The Datagram Transport Layer Security (DTLS) Protocol Version 1.3

The Datagram Transport Layer Security (DTLS) Protocol Version 1.3 Independent

ekr@rtfm.com

University of Applied Sciences Bonn-Rhein-Sieg

hannes.tschofenig@gmx.net

Google, Inc.

nagendra@cs.stanford.edu

Security TLS Internet-Draft This document specifies version 1.3 of the Datagram Transport Layer Security (DTLS) protocol. DTLS 1.3 allows client/server applications to communicate over the Internet in a way that is designed to prevent eavesdropping, tampering, and message forgery. The DTLS 1.3 protocol is based on the Transport Layer Security (TLS) 1.3 protocol and provides equivalent security guarantees with the exception of order protection / non-replayability. Datagram semantics of the underlying transport are preserved by the DTLS protocol. This document obsoletes RFC 6347.

Introduction The primary goal of the TLS protocol is to establish an authenticated, confidentiality- and integrity-protected channel between two communicating peers. The TLS protocol is composed of two layers: the TLS record protocol and the TLS handshake protocol. However, TLS must run over a reliable transport channel -- typically TCP . There are applications that use UDP as a transport and the Datagram Transport Layer Security (DTLS) protocol has been developed to offer communication security protection for those applications. DTLS is deliberately designed to be as similar to TLS as possible, both to minimize new security invention and to maximize the amount of code and infrastructure reuse. DTLS 1.0 was originally defined as a delta from TLS 1.1 , and DTLS 1.2 was defined as a series of deltas to TLS 1.2 . There is no DTLS 1.1; that version number was skipped in order to harmonize version numbers with TLS. This specification describes the most current version of the DTLS protocol as a delta from TLS 1.3 . It obsoletes DTLS 1.2. Implementations that speak both DTLS 1.2 and DTLS 1.3 can interoperate with those that speak only DTLS 1.2 (using DTLS 1.2 of course), just as TLS 1.3 implementations can interoperate with TLS 1.2 (see Appendix D of for details). While backwards compatibility with DTLS 1.0 is possible, the use of DTLS 1.0 is not recommended, as explained in Section 3.1.2 of . forbids the use of DTLS 1.0.

Conventions and Terminology The key words "MUST", "MUST NOT", "REQUIRED", "SHALL", "SHALL NOT", "SHOULD", "SHOULD NOT", "RECOMMENDED", "NOT RECOMMENDED", "MAY", and "OPTIONAL" in this document are to be interpreted as described in BCP 14 when, and only when, they appear in all capitals, as shown here. The following terms are used:

client: The endpoint initiating the DTLS connection.
association: Shared state between two endpoints established with a DTLS handshake.
connection: Synonym for association.
endpoint: Either the client or server of the connection.
epoch: one set of cryptographic keys used for encryption and decryption.
handshake: An initial negotiation between client and server that establishes the parameters of the connection.
peer: An endpoint. When discussing a particular endpoint, "peer" refers to the endpoint that is remote to the primary subject of discussion.
receiver: An endpoint that is receiving records.
sender: An endpoint that is transmitting records.
server: The endpoint which did not initiate the DTLS connection.
CID: Connection ID
MSL: Maximum Segment Lifetime

The reader is assumed to be familiar with . As in TLS 1.3, the HelloRetryRequest has the same format as a ServerHello message, but for convenience we use the term HelloRetryRequest throughout this document as if it were a distinct message. DTLS 1.3 uses network byte order (big-endian) format for encoding messages based on the encoding format defined in and earlier (D)TLS specifications. The reader is also assumed to be familiar with as this document applies the CID functionality to DTLS 1.3. Figures in this document illustrate various combinations of the DTLS protocol exchanges, and the symbols have the following meaning:

'+' indicates noteworthy extensions sent in the previously noted message.
'*' indicates optional or situation-dependent messages/extensions that are not always sent.
'{}' indicates messages protected using keys derived from a [sender]_handshake_traffic_secret.
'[]' indicates messages protected using keys derived from traffic_secret_N.

DTLS Design Rationale and Overview The basic design philosophy of DTLS is to construct "TLS over datagram transport". Datagram transport neither requires nor provides reliable or in-order delivery of data. The DTLS protocol preserves this property for application data. Applications such as media streaming, Internet telephony, and online gaming use datagram transport for communication due to the delay-sensitive nature of transported data. The behavior of such applications is unchanged when the DTLS protocol is used to secure communication, since the DTLS protocol does not compensate for lost or reordered data traffic. Note that while low-latency streaming and gaming use DTLS to protect data (e.g., for protection of a WebRTC data channel), telephony utilizes DTLS for key establishment and the Secure Real-time Transport Protocol (SRTP) for protection of data . TLS cannot be used directly over datagram transports for the following four reasons:

TLS relies on an implicit sequence number on records. If a record is not received, then the recipient will use the wrong sequence number when attempting to remove record protection from subsequent records. DTLS solves this problem by adding sequence numbers to records.
The TLS handshake is a lock-step cryptographic protocol. Messages must be transmitted and received in a defined order; any other order is an error. The DTLS handshake includes message sequence numbers to enable fragmented message reassembly and in-order delivery in case datagrams are lost or reordered.
Handshake messages are potentially larger than can be contained in a single datagram. DTLS adds fields to handshake messages to support fragmentation and reassembly.
Datagram transport protocols are susceptible to abusive behavior effecting denial-of-service (DoS) attacks against nonparticipants. DTLS adds a return-routability check and DTLS 1.3 uses the TLS 1.3 HelloRetryRequest message (see for details).

Packet Loss DTLS uses a simple retransmission timer to handle packet loss. demonstrates the basic concept, using the first phase of the DTLS handshake:

DTLS Retransmission Example X<-- HelloRetryRequest (lost) [Timer Expires] ClientHello ------> (retransmit) ]]> Once the client has transmitted the ClientHello message, it expects to see a HelloRetryRequest or a ServerHello from the server. However, if the timer expires, the client knows that either the ClientHello or the response from the server has been lost, which causes the client to retransmit the ClientHello. When the server receives the retransmission, it knows to retransmit its HelloRetryRequest or ServerHello. The server also maintains a retransmission timer for messages it sends (other than HelloRetryRequest) and retransmits when that timer expires. Not applying retransmissions to the HelloRetryRequest avoids the need to create state on the server. The HelloRetryRequest is designed to be small enough that it will not itself be fragmented, thus avoiding concerns about interleaving multiple HelloRetryRequests. For more detail on timeouts and retransmission, see .

Reordering In DTLS, each handshake message is assigned a specific sequence number. When a peer receives a handshake message, it can quickly determine whether that message is the next message it expects. If it is, then it processes it. If not, it queues it for future handling once all previous messages have been received.

Fragmentation TLS and DTLS handshake messages can be quite large (in theory up to 2^24-1 bytes, in practice many kilobytes). By contrast, UDP datagrams are often limited to less than 1500 bytes if IP fragmentation is not desired. In order to compensate for this limitation, each DTLS handshake message may be fragmented over several DTLS records, each of which is intended to fit in a single UDP datagram (see for guidance). Each DTLS handshake message contains both a fragment offset and a fragment length. Thus, a recipient in possession of all bytes of a handshake message can reassemble the original unfragmented message.

Replay Detection DTLS optionally supports record replay detection. The technique used is the same as in IPsec AH/ESP, by maintaining a bitmap window of received records. Records that are too old to fit in the window and records that have previously been received are silently discarded. The replay detection feature is optional, since packet duplication is not always malicious but can also occur due to routing errors. Applications may conceivably detect duplicate packets and accordingly modify their data transmission strategy.

The DTLS Record Layer The DTLS 1.3 record layer is different from the TLS 1.3 record layer and also different from the DTLS 1.2 record layer.

The DTLSCiphertext structure omits the superfluous version number and type fields.
DTLS adds an epoch and sequence number to the TLS record header. This sequence number allows the recipient to correctly decrypt and verify DTLS records. However, the number of bits used for the epoch and sequence number fields in the DTLSCiphertext structure has been reduced from those in previous versions.
The DTLS epoch serialized in DTLSPlaintext is 2 octets long for compatibility with DTLS 1.2. However, this value is set as the least significant 2 octets of the connection epoch, which is an 8 octet counter incremented on every KeyUpdate. See for details. The sequence number is set to be the low order 48 bits of the 64 bit sequence number. Plaintext records MUST NOT be sent with sequence numbers that would exceed 2^48-1, so the upper 16 bits will always be 0.
The DTLSCiphertext structure has a variable-length header.

DTLSPlaintext records are used to send unprotected records and DTLSCiphertext records are used to send protected records. The DTLS record formats are shown below. Unless explicitly stated the meaning of the fields is unchanged from previous TLS/DTLS versions.

DTLS 1.3 Record Formats

legacy_record_version:: This value MUST be set to {254, 253} for all records other than the initial ClientHello (i.e., one not generated after a HelloRetryRequest), where it may also be {254, 255} for compatibility purposes. It MUST be ignored for all purposes. See , Appendix D.1 for the rationale for this.
epoch:: The least significant 2 bytes of the connection epoch value.
unified_hdr:: The unified header (unified_hdr) is a structure of variable length, shown in .
encrypted_record:: The encrypted form of the serialized DTLSInnerPlaintext structure.

DTLS 1.3 Unified Header

Fixed Bits:: The three high bits of the first byte of the unified header are set to 001. This ensures that the value will fit within the DTLS region when multiplexing is performed as described in . It also ensures that distinguishing encrypted DTLS 1.3 records from encrypted DTLS 1.2 records is possible when they are carried on the same host/port quartet; such multiplexing is only possible when CIDs are in use, in which case DTLS 1.2 records will have the content type tls12_cid (25).
C:: The C bit (0x10) is set if the Connection ID is present.
S:: The S bit (0x08) indicates the size of the sequence number. 0 means an 8-bit sequence number, 1 means 16-bit. Implementations MAY mix sequence numbers of different lengths on the same connection.
L:: The L bit (0x04) is set if the length is present.
E:: The two low bits (0x03) include the low-order two bits of the epoch.
Connection ID:: Variable-length CID. The CID functionality is described in . An example can be found in .
Sequence Number:: The low-order 8 or 16 bits of the record sequence number. This value is 16 bits if the S bit is set to 1, and 8 bits if the S bit is 0.
Length:: Identical to the length field in a TLS 1.3 record.

As with previous versions of DTLS, multiple DTLSPlaintext and DTLSCiphertext records can be included in the same underlying transport datagram. illustrates different record headers.

DTLS 1.3 Header Examples The length field MAY be omitted by clearing the L bit, which means that the record consumes the entire rest of the datagram in the lower level transport. In this case, it is not possible to have multiple DTLSCiphertext format records without length fields in the same datagram. Omitting the length field MUST only be used for the last record in a datagram. Implementations MAY mix records with and without length fields on the same connection. If a Connection ID is negotiated, then it MUST be contained in all datagrams. Sending implementations MUST NOT mix records from multiple DTLS associations in the same datagram. If the second or later record has a connection ID which does not correspond to the same association used for previous records, the rest of the datagram MUST be discarded. When expanded, the epoch and sequence number can be combined into an unpacked RecordNumber structure, as shown below: This 128-bit value is used in the ACK message. The entire header value shown in (but prior to record number encryption; see ) is used as the additional data value for the AEAD function. For instance, if the minimal variant is used, the Associated Data (AD) is 2 octets long. Note that this design is different from the additional data calculation for DTLS 1.2 and for DTLS 1.2 with Connection IDs. In DTLS 1.3 the 64-bit sequence_number is used as the sequence number for the AEAD computation; unlike DTLS 1.2, the epoch is not included.

Demultiplexing DTLS Records DTLS 1.3's header format is more complicated to demux than DTLS 1.2, which always carried the content type as the first byte. As described in , the first byte determines how an incoming DTLS record is demultiplexed. The first 3 bits of the first byte distinguish a DTLS 1.3 encrypted record from record types used in previous DTLS versions and plaintext DTLS 1.3 record types. Hence, the range 32 (0b0010 0000) to 63 (0b0011 1111) needs to be excluded from future allocations by IANA to avoid problems while demultiplexing; see . Implementations can demultiplex DTLS 1.3 records by examining the first byte as follows:

If the first byte is alert(21), handshake(22), or ack(26), the record MUST be interpreted as a DTLSPlaintext record.
If the first byte is any other value, then receivers MUST check to see if the leading bits of the first byte are 001. If so, the implementation MUST process the record as DTLSCiphertext; the true content type will be inside the protected portion.
Otherwise, the record MUST be rejected as if it had failed deprotection, as described in .

shows this demultiplexing procedure graphically, taking DTLS 1.3 and earlier versions of DTLS into account.

Sequence Number and Epoch DTLS uses an explicit or partly explicit sequence number, rather than an implicit one, carried in the sequence_number field of the record. Sequence numbers are maintained separately for each epoch, with each sequence_number initially being 0 for each epoch. The epoch number is initially zero and is incremented each time keying material changes and a sender aims to rekey. More details are provided in .

Processing Guidelines Because DTLS records could be reordered, a record from epoch M may be received after epoch N (where N > M) has begun. Implementations SHOULD discard records from earlier epochs but MAY choose to retain keying material from previous epochs for up to the default MSL specified for TCP to allow for packet reordering. (Note that the intention here is that implementers use the current guidance from the IETF for MSL, as specified in or successors, not that they attempt to interrogate the MSL that the system TCP stack is using.) Conversely, it is possible for records that are protected with the new epoch to be received prior to the completion of a handshake. For instance, the server may send its Finished message and then start transmitting data. Implementations MAY either buffer or discard such records, though when DTLS is used over reliable transports (e.g., SCTP ), they SHOULD be buffered and processed once the handshake completes. Note that TLS's restrictions on when records may be sent still apply, and the receiver treats the records as if they were sent in the right order. Implementations MUST send retransmissions of lost messages using the same epoch and keying material as the original transmission. Implementations MUST either abandon an association or rekey prior to allowing the sequence number to wrap. Implementations MUST NOT allow the epoch to wrap, but instead MUST establish a new association, terminating the old association.

Reconstructing the Sequence Number and Epoch When receiving protected DTLS records, the recipient does not have a full epoch or sequence number value in the record and so there is some opportunity for ambiguity. Because the full sequence number is used to compute the per-record nonce and the epoch determines the keys, failure to reconstruct these values leads to failure to deprotect the record, and so implementations MAY use a mechanism of their choice to determine the full values. This section provides an algorithm which is comparatively simple and which implementations are RECOMMENDED to follow. If the epoch bits match those of the current epoch, then implementations SHOULD reconstruct the sequence number by computing the full sequence number which is numerically closest to one plus the sequence number of the highest successfully deprotected record in the current epoch. During the handshake phase, the epoch bits unambiguously indicate the correct key to use. After the handshake is complete, if the epoch bits do not match those from the current epoch, implementations SHOULD use the most recent past epoch which has matching bits, and then reconstruct the sequence number for that epoch as described above.

Record Number Encryption In DTLS 1.3, when records are encrypted, record sequence numbers are also encrypted. The basic pattern is that the underlying encryption algorithm used with the AEAD algorithm is used to generate a mask which is then XORed with the sequence number. When the AEAD is based on AES, then the mask is generated by computing AES-ECB on the first 16 bytes of the ciphertext: When the AEAD is based on ChaCha20, then the mask is generated by treating the first 4 bytes of the ciphertext as the block counter and the next 12 bytes as the nonce, passing them to the ChaCha20 block function (Section 2.3 of ): The sn_key is computed as follows: [sender] denotes the sending side. The per-epoch Secret value to be used is described in Section 7.3 of . Note that a new key is used for each epoch: because the epoch is sent in the clear, this does not result in ambiguity. The encrypted sequence number is computed by XORing the leading bytes of the mask with the on-the-wire representation of the sequence number. Decryption is accomplished by the same process. This procedure requires the ciphertext length to be at least 16 bytes. Receivers MUST reject shorter records as if they had failed deprotection, as described in . Senders MUST pad short plaintexts out (using the conventional record padding mechanism) in order to make a suitable-length ciphertext. Note that most of the DTLS AEAD algorithms have a 16 byte authentication tag and need no padding. However, some algorithms, such as TLS_AES_128_CCM_8_SHA256, have a shorter authentication tag and may require padding for short inputs. Future cipher suites, which are not based on AES or ChaCha20, MUST define their own record sequence number encryption in order to be used with DTLS. Note that sequence number encryption is only applied to the DTLSCiphertext structure and not to the DTLSPlaintext structure, even though it also contains a sequence number.

Transport Layer Mapping DTLS messages MAY be fragmented into multiple DTLS records. Each DTLS record MUST fit within a single datagram. In order to avoid IP fragmentation, clients of the DTLS record layer SHOULD attempt to size records so that they fit within any Path MTU (PMTU) estimates obtained from the record layer. For more information about PMTU issues, see . Multiple DTLS records MAY be placed in a single datagram. Records are encoded consecutively. The length field from DTLS records containing that field can be used to determine the boundaries between records. The final record in a datagram can omit the length field. The first byte of the datagram payload MUST be the beginning of a record. Records MUST NOT span datagrams. DTLS records without CIDs do not contain any association identifiers, and applications must arrange to multiplex between associations. With UDP, the host/port number is used to look up the appropriate security association for incoming records without CIDs. Some transports, such as DCCP , provide their own sequence numbers. When carried over those transports, both the DTLS and the transport sequence numbers will be present. Although this introduces a small amount of inefficiency, the transport layer and DTLS sequence numbers serve different purposes; therefore, for conceptual simplicity, it is superior to use both sequence numbers. Some transports provide congestion control for traffic carried over them. If the congestion window is sufficiently narrow, DTLS handshake retransmissions may be held rather than transmitted immediately, potentially leading to timeouts and spurious retransmission. When DTLS is used over such transports, care should be taken not to overrun the likely congestion window. defines a mapping of DTLS to DCCP that takes these issues into account.

PMTU Issues In general, DTLS's philosophy is to leave PMTU discovery to the application. However, DTLS cannot completely ignore the PMTU for three reasons:

The DTLS record framing expands the datagram size, thus lowering the effective PMTU from the application's perspective.
In some implementations, the application may not directly talk to the network, in which case the DTLS stack may absorb ICMP "Datagram Too Big" indications or ICMPv6 "Packet Too Big" indications .
The DTLS handshake messages can exceed the PMTU.

In order to deal with the first two issues, the DTLS record layer SHOULD behave as described below. If PMTU estimates are available from the underlying transport protocol, they should be made available to upper layer protocols. In particular:

For DTLS over UDP, the upper layer protocol SHOULD be allowed to obtain the PMTU estimate maintained in the IP layer.
For DTLS over DCCP, the upper layer protocol SHOULD be allowed to obtain the current estimate of the PMTU.
For DTLS over TCP or SCTP, which automatically fragment and reassemble datagrams, there is no PMTU limitation. However, the upper layer protocol MUST NOT write any record that exceeds the maximum record size of 2^14 bytes.

The DTLS record layer SHOULD also allow the upper layer protocol to discover the amount of record expansion expected by the DTLS processing; alternately, it MAY report PMTU estimates minus the estimated expansion from the transport layer and DTLS record framing. Note that DTLS does not defend against spoofed ICMP messages; implementations SHOULD ignore any such messages that indicate PMTUs below the IPv4 and IPv6 minimums of 576 and 1280 bytes, respectively. If there is a transport protocol indication that the PMTU was exceeded (either via ICMP or via a refusal to send the datagram as in Section 14 of ), then the DTLS record layer MUST inform the upper layer protocol of the error. The DTLS record layer SHOULD NOT interfere with upper layer protocols performing PMTU discovery, whether via and for IPv4 or via for IPv6. In particular:

Where allowed by the underlying transport protocol, the upper layer protocol SHOULD be allowed to set the state of the Don't Fragment (DF) bit (in IPv4) or prohibit local fragmentation (in IPv6).
If the underlying transport protocol allows the application to request PMTU probing (e.g., DCCP), the DTLS record layer SHOULD honor this request.

The final issue is the DTLS handshake protocol. From the perspective of the DTLS record layer, this is merely another upper layer protocol. However, DTLS handshakes occur infrequently and involve only a few round trips; therefore, the handshake protocol PMTU handling places a premium on rapid completion over accurate PMTU discovery. In order to allow connections under these circumstances, DTLS implementations SHOULD follow the following rules:

If the DTLS record layer informs the DTLS handshake layer that a message is too big, the handshake layer SHOULD immediately attempt to fragment the message, using any existing information about the PMTU.
If repeated retransmissions do not result in a response, and the PMTU is unknown, subsequent retransmissions SHOULD back off to a smaller record size, fragmenting the handshake message as appropriate. This specification does not specify an exact number of retransmits to attempt before backing off, but 2-3 seems appropriate.

Record Payload Protection Like TLS, DTLS transmits data as a series of protected records. The rest of this section describes the details of that format.

Anti-Replay Each DTLS record contains a sequence number to provide replay protection. Sequence number verification SHOULD be performed using the following sliding window procedure, borrowed from Section 3.4.3 of . Because each epoch resets the sequence number space, a separate sliding window is needed for each epoch. The received record counter for an epoch MUST be initialized to zero when that epoch is first used. For each received record, the receiver MUST verify that the record contains a sequence number that does not duplicate the sequence number of any other record received in that epoch during the lifetime of the association. This check SHOULD happen after deprotecting the record; otherwise, the record discard might itself serve as a timing channel for the record number. Note that computing the full record number from the partial is still a potential timing channel for the record number, though a less powerful one than whether the record was deprotected. Duplicates are rejected through the use of a sliding receive window. (How the window is implemented is a local matter, but the following text describes the functionality that the implementation must exhibit.) The receiver SHOULD pick a window large enough to handle any plausible reordering, which depends on the data rate. (The receiver does not notify the sender of the window size.) The "right" edge of the window represents the highest validated sequence number value received in the epoch. Records that contain sequence numbers lower than the "left" edge of the window are rejected. Records falling within the window are checked against a list of received records within the window. An efficient means for performing this check, based on the use of a bit mask, is described in Section 3.4.3 of . If the received record falls within the window and is new, or if the record is to the right of the window, then the record is new. The window MUST NOT be updated due to a received record until that record has been deprotected successfully.

Handling Invalid Records Unlike TLS, DTLS is resilient in the face of invalid records (e.g., invalid formatting, length, MAC, etc.). In general, invalid records SHOULD be silently discarded, thus preserving the association; however, an error MAY be logged for diagnostic purposes. Implementations which choose to generate an alert instead MUST generate fatal alerts to avoid attacks where the attacker repeatedly probes the implementation to see how it responds to various types of error. Note that if DTLS is run over UDP, then any implementation which does this will be extremely susceptible to DoS attacks because UDP forgery is so easy. Thus, generating fatal alerts is NOT RECOMMENDED for such transports, both to increase the reliability of DTLS service and to avoid the risk of spoofing attacks sending traffic to unrelated third parties. If DTLS is being carried over a transport that is resistant to forgery (e.g., SCTP with SCTP-AUTH ), then it is safer to send alerts because an attacker will have difficulty forging a datagram that will not be rejected by the transport layer. Note that because invalid records are rejected at a layer lower than the handshake state machine, they do not affect pending retransmission timers.

AEAD Limits Section 5.5 of defines limits on the number of records that can be protected using the same keys. These limits are specific to an AEAD algorithm and apply equally to DTLS. Implementations SHOULD NOT protect more records than allowed by the limit specified for the negotiated AEAD. Implementations SHOULD initiate a key update before reaching this limit. does not specify a limit for AEAD_AES_128_CCM, but the analysis in shows that a limit of 2^23 packets can be used to obtain the same confidentiality protection as the limits specified in TLS. The usage limits defined in TLS 1.3 exist for protection against attacks on confidentiality and apply to successful applications of AEAD protection. The integrity protections in authenticated encryption also depend on limiting the number of attempts to forge packets. TLS achieves this by closing connections after any record fails an authentication check. In comparison, DTLS ignores any packet that cannot be authenticated, allowing multiple forgery attempts. Implementations MUST count the number of received packets that fail authentication with each key. If the number of packets that fail authentication exceeds a limit that is specific to the AEAD in use, an implementation SHOULD immediately close the connection. Implementations SHOULD initiate a key update with update_requested before reaching this limit. Once a key update has been initiated, the previous keys can be dropped when the limit is reached rather than closing the connection. Applying a limit reduces the probability that an attacker is able to successfully forge a packet; see and . For AEAD_AES_128_GCM, AEAD_AES_256_GCM, and AEAD_CHACHA20_POLY1305, the limit on the number of records that fail authentication is 2^36. Note that the analysis in supports a higher limit for AEAD_AES_128_GCM and AEAD_AES_256_GCM, but this specification recommends a lower limit. For AEAD_AES_128_CCM, the limit on the number of records that fail authentication is 2^23.5; see . The AEAD_AES_128_CCM_8 AEAD, as used in TLS_AES_128_CCM_8_SHA256, does not have a limit on the number of records that fail authentication that both limits the probability of forgery by the same amount and does not expose implementations to the risk of denial of service; see . Therefore, TLS_AES_128_CCM_8_SHA256 MUST NOT be used in DTLS without additional safeguards against forgery. Implementations MUST set usage limits for AEAD_AES_128_CCM_8 based on an understanding of any additional forgery protections that are used. Any TLS cipher suite that is specified for use with DTLS MUST define limits on the use of the associated AEAD function that preserves margins for both confidentiality and integrity. That is, limits MUST be specified for the number of packets that can be authenticated and for the number of packets that can fail authentication before a key update is required. Providing a reference to any analysis upon which values are based -- and any assumptions used in that analysis -- allows limits to be adapted to varying usage conditions.

The DTLS Handshake Protocol DTLS 1.3 reuses the TLS 1.3 handshake messages and flows, with the following changes:

To handle message loss, reordering, and fragmentation, modifications to the handshake header are necessary.
Retransmission timers are introduced to handle message loss.
A new ACK content type has been added for reliable message delivery of handshake messages.

In addition, DTLS reuses TLS 1.3's "cookie" extension to provide a return-routability check as part of connection establishment. This is an important DoS prevention mechanism for UDP-based protocols, unlike TCP-based protocols, for which TCP establishes return-routability as part of the connection establishment. DTLS implementations do not use the TLS 1.3 "compatibility mode" described in Appendix D.4 of . DTLS servers MUST NOT send ChangeCipherSpec messages when negotiating DTLS 1.3. Additionally, the "legacy_session_id_echo" field of the ServerHello message, described in Section 4.1.3 of , MUST be empty in DTLS 1.3. DTLS 1.3 servers MUST NOT echo the "legacy_session_id" value from the ClientHello. DTLS 1.3 clients MUST abort the handshake with an "illegal_parameter" alert if the field is not empty. This applies even if the "legacy_session_id" field of the ClientHello is non-empty due to a cached session set by a pre-DTLS 1.3 server. With these exceptions, the DTLS message formats, flows, and logic are the same as those of TLS 1.3.

Denial-of-Service Countermeasures Datagram security protocols are extremely susceptible to a variety of DoS attacks. Two attacks are of particular concern:

An attacker can consume excessive resources on the server by transmitting a series of handshake initiation requests, causing the server to allocate state and potentially to perform expensive cryptographic operations.
An attacker can use the server as an amplifier by sending connection initiation messages with a forged source address that belongs to a victim. The server then sends its response to the victim machine, thus flooding it. Depending on the selected parameters, this response message can be quite large, as is the case for a Certificate message.

In order to counter both of these attacks, DTLS borrows the stateless cookie technique used by Photuris and IKE . When the client sends its ClientHello message to the server, the server MAY respond with a HelloRetryRequest message. The HelloRetryRequest message, as well as the "cookie" extension, is defined in TLS 1.3. The HelloRetryRequest message contains a stateless cookie (see , Section 4.2.2). The client MUST send a new ClientHello with the cookie added as an extension. The server then verifies the cookie and proceeds with the handshake only if it is valid. This mechanism forces the attacker/client to be able to receive the cookie, which makes DoS attacks with spoofed IP addresses difficult. This mechanism does not provide any defense against DoS attacks mounted from valid IP addresses. The DTLS 1.3 specification changes how cookies are exchanged compared to DTLS 1.2. DTLS 1.3 reuses the HelloRetryRequest message and conveys the cookie to the client via an extension. The client receiving the cookie uses the same extension to place the cookie subsequently into a ClientHello message. DTLS 1.2, on the other hand, used a separate message, namely the HelloVerifyRequest, to pass a cookie to the client and did not utilize the extension mechanism. For backwards compatibility reasons, the cookie field in the ClientHello is present in DTLS 1.3 but is ignored by a DTLS 1.3-compliant server implementation. The exchange is shown in . Note that the figure focuses on the cookie exchange; all other extensions are omitted.

DTLS Exchange with HelloRetryRequest Containing the "cookie" Extension <----- HelloRetryRequest + cookie ClientHello ------> + cookie [Rest of handshake] ]]> The "cookie" extension is defined in Section 4.2.2 of . When sending the initial ClientHello, the client does not have a cookie yet. In this case, the "cookie" extension is omitted and the legacy_cookie field in the ClientHello message MUST be set to a zero-length vector (i.e., a zero-valued single byte length field). When responding to a HelloRetryRequest, the client MUST create a new ClientHello message following the description in Section 4.1.2 of . If the HelloRetryRequest message is used, the initial ClientHello and the HelloRetryRequest are included in the calculation of the transcript hash. The computation of the message hash for the HelloRetryRequest is done according to the description in Section 4.4.1 of . The handshake transcript is not reset with the second ClientHello, and a stateless server-cookie implementation requires the content or hash of the initial ClientHello (and HelloRetryRequest) to be stored in the cookie. The initial ClientHello is included in the handshake transcript as a synthetic "message_hash" message, so only the hash value is needed for the handshake to complete, though the complete HelloRetryRequest contents are needed. When the second ClientHello is received, the server can verify that the cookie is valid and that the client can receive packets at the given IP address. If the client's apparent IP address is embedded in the cookie, this prevents an attacker from generating an acceptable ClientHello apparently from another user. One potential attack on this scheme is for the attacker to collect a number of cookies from different addresses where it controls endpoints and then reuse them to attack the server. The server can defend against this attack by changing the secret value frequently, thus invalidating those cookies. If the server wishes to allow legitimate clients to handshake through the transition (e.g., a client received a cookie with Secret 1 and then sent the second ClientHello after the server has changed to Secret 2), the server can have a limited window during which it accepts both secrets. suggests adding a key identifier to cookies to detect this case. An alternative approach is simply to try verifying with both secrets. It is RECOMMENDED that servers implement a key rotation scheme that allows the server to manage keys with overlapping lifetimes. Alternatively, the server can store timestamps in the cookie and reject cookies that were generated outside a certain interval of time. DTLS servers SHOULD perform a cookie exchange whenever a new handshake is being performed. If the server is being operated in an environment where amplification is not a problem, e.g., where ICE has been used to establish bidirectional connectivity, the server MAY be configured not to perform a cookie exchange. The default SHOULD be that the exchange is performed, however. In addition, the server MAY choose not to do a cookie exchange when a session is resumed or, more generically, when the DTLS handshake uses a PSK-based key exchange and the IP address matches one associated with the PSK. Servers which process 0-RTT requests and send 0.5-RTT responses without a cookie exchange risk being used in an amplification attack if the size of outgoing messages greatly exceeds the size of those that are received. A server SHOULD limit the amount of data it sends toward a client address to three times the amount of data sent by the client before it verifies that the client is able to receive data at that address. A client address is valid after a cookie exchange or handshake completion. Clients MUST be prepared to do a cookie exchange with every handshake. Note that cookies are only valid for the existing handshake and cannot be stored for future handshakes. If a server receives a ClientHello with an invalid cookie, it MUST terminate the handshake with an "illegal_parameter" alert. This allows the client to restart the connection from scratch without a cookie. As described in Section 4.1.4 of , clients MUST abort the handshake with an "unexpected_message" alert in response to any second HelloRetryRequest which was sent in the same connection (i.e., where the ClientHello was itself in response to a HelloRetryRequest). DTLS clients which do not want to receive a Connection ID SHOULD still offer the "connection_id" extension unless there is an application profile to the contrary. This permits a server which wants to receive a CID to negotiate one.

DTLS Handshake Message Format DTLS uses the same Handshake messages as TLS 1.3. However, prior to transmission they are converted to DTLSHandshake messages, which contain extra data needed to support message loss, reordering, and message fragmentation. In DTLS 1.3, the message transcript is computed over the original TLS 1.3-style Handshake messages without the message_seq, fragment_offset, and fragment_length values. Note that this is a change from DTLS 1.2 where those values were included in the transcript. The first message each side transmits in each association always has message_seq = 0. Whenever a new message is generated, the message_seq value is incremented by one. Implementations MUST NOT allow message_seq to wrap, but instead MUST establish a new association, terminating the old association. When a message is retransmitted, the old message_seq value is reused, i.e., not incremented. From the perspective of the DTLS record layer, the retransmission is a new record. This record will have a new DTLSPlaintext.sequence_number value. Note: In DTLS 1.2, the message_seq was reset to zero in case of a rehandshake (i.e., renegotiation). On the surface, a rehandshake in DTLS 1.2 shares similarities with a post-handshake message exchange in DTLS 1.3. However, in DTLS 1.3 the message_seq is not reset, to allow distinguishing a retransmission from a previously sent post-handshake message from a newly sent post-handshake message. DTLS implementations maintain (at least notionally) a next_receive_seq counter. This counter is initially set to zero. When a handshake message is received, if its message_seq value matches next_receive_seq, next_receive_seq is incremented and the message is processed. If the sequence number is less than next_receive_seq, the message MUST be discarded. If the sequence number is greater than next_receive_seq, the implementation SHOULD queue the message but MAY discard it. (This is a simple space/bandwidth trade-off). In addition to the handshake messages that are deprecated by the TLS 1.3 specification, DTLS 1.3 furthermore deprecates the HelloVerifyRequest message originally defined in DTLS 1.0. DTLS 1.3-compliant implementations MUST NOT use the HelloVerifyRequest to execute a return-routability check. A dual-stack DTLS 1.2 / DTLS 1.3 client MUST, however, be prepared to interact with a DTLS 1.2 server.

ClientHello Message The format of the ClientHello used by a DTLS 1.3 client differs from the TLS 1.3 ClientHello format, as shown below. ; opaque legacy_cookie<0..2^8-1>; // DTLS CipherSuite cipher_suites<2..2^16-2>; opaque legacy_compression_methods<1..2^8-1>; Extension extensions<8..2^16-1>; } ClientHello; ]]>

legacy_version:: In previous versions of DTLS, this field was used for version negotiation and represented the highest version number supported by the client. Experience has shown that many servers do not properly implement version negotiation, leading to "version intolerance" in which the server rejects an otherwise acceptable ClientHello with a version number higher than it supports. In DTLS 1.3, the client indicates its version preferences in the "supported_versions" extension (see Section 4.2.1 of ) and the legacy_version field MUST be set to {254, 253}, which was the version number for DTLS 1.2. The supported_versions entries for DTLS 1.0 and DTLS 1.2 are 0xfeff and 0xfefd (to match the wire versions). The value 0xfefc is used to indicate DTLS 1.3.
random:: Same as for TLS 1.3, except that the downgrade sentinels described in Section 4.1.3 of when TLS 1.2 and TLS 1.1 and below are negotiated apply to DTLS 1.2 and DTLS 1.0, respectively.
legacy_session_id:: Versions of TLS and DTLS before version 1.3 supported a "session resumption" feature, which has been merged with pre-shared keys (PSK) in version 1.3. A client which has a cached session set by a pre-DTLS 1.3 server SHOULD set this field according to that session. Otherwise, it MUST be set as a zero-length vector (i.e., a zero-valued single byte length field).
legacy_cookie:: A DTLS 1.3-only client MUST set the legacy_cookie field to zero length. If a DTLS 1.3 ClientHello is received with any other value in this field, the server MUST abort the handshake with an "illegal_parameter" alert.
cipher_suites:: Same as for TLS 1.3; only suites with DTLS-OK=Y may be used.
legacy_compression_methods:: Same as for TLS 1.3.
extensions:: Same as for TLS 1.3.

ServerHello Message The DTLS 1.3 ServerHello message is the same as the TLS 1.3 ServerHello message, except that the legacy_version field is set to 0xfefd, indicating DTLS 1.2.

Handshake Message Fragmentation and Reassembly As described in , one or more handshake messages may be carried in a single datagram. However, handshake messages are potentially bigger than the size allowed by the underlying datagram transport. DTLS provides a mechanism for fragmenting a handshake message over a number of records, each of which can be transmitted in separate datagrams, thus avoiding IP fragmentation. When transmitting the handshake message, the sender divides the message into a series of N contiguous data ranges. The ranges MUST NOT overlap. The sender then creates N DTLSHandshake messages, all with the same message_seq value as the original DTLSHandshake message. Each new message is labeled with the fragment_offset (the number of bytes contained in previous fragments) and the fragment_length (the length of this fragment). The length field in all messages is the same as the length field of the original message. An unfragmented message is a degenerate case with fragment_offset=0 and fragment_length=length. Each handshake message fragment that is placed into a record MUST be delivered in a single UDP datagram. When a DTLS implementation receives a handshake message fragment corresponding to the next expected handshake message sequence number, it MUST process it, either by buffering it until it has the entire handshake message or by processing any in-order portions of the message. The transcript consists of complete TLS Handshake messages (reassembled as necessary). Note that this requires removing the message_seq, fragment_offset, and fragment_length fields to create the Handshake structure. DTLS implementations MUST be able to handle overlapping fragment ranges. This allows senders to retransmit handshake messages with smaller fragment sizes if the PMTU estimate changes. Senders MUST NOT change handshake message bytes upon retransmission. Receivers MAY check that retransmitted bytes are identical and SHOULD abort the handshake with an "illegal_parameter" alert if the value of a byte changes. Note that as with TLS, multiple handshake messages may be placed in the same DTLS record, provided that there is room and that they are part of the same flight. Thus, there are two acceptable ways to pack two DTLS handshake messages into the same datagram: in the same record or in separate records.

EndOfEarlyData Message The DTLS 1.3 handshake has one important difference from the TLS 1.3 handshake: the EndOfEarlyData message is omitted both from the wire and the handshake transcript. Because DTLS records have epochs, EndOfEarlyData is not necessary to determine when the early data is complete, and because DTLS is lossy, attackers can trivially mount the deletion attacks that EndOfEarlyData prevents in TLS. Servers SHOULD NOT accept records from epoch 1 indefinitely once they are able to process records from epoch 3. Though reordering of IP packets can result in records from epoch 1 arriving after records from epoch 3, this is not likely to persist for very long relative to the round trip time. Servers could discard epoch 1 keys after the first epoch 3 data arrives, or retain keys for processing epoch 1 data for a short period. (See for the definitions of each epoch.)

DTLS Handshake Flights DTLS handshake messages are grouped into a series of message flights. A flight starts with the handshake message transmission of one peer and ends with the expected response from the other peer. contains a complete list of message combinations that constitute flights. Flight Handshake Message Combinations

Note	Client	Server	Handshake Messages
	x		ClientHello
		x	HelloRetryRequest
		x	ServerHello, EncryptedExtensions, CertificateRequest, Certificate, CertificateVerify, Finished
1	x		Certificate, CertificateVerify, Finished
1		x	NewSessionTicket

Remarks:

does not highlight any of the optional messages.
Regarding note (1): When a handshake flight is sent without any expected response, as is the case with the client's final flight or with the NewSessionTicket message, the flight must be acknowledged with an ACK message.

Below are several example message exchanges illustrating the flight concept. The notational conventions from are used.

Message Flights for a Full DTLS Handshake (with Cookie Exchange) +--------+ +--------+ <-------- HelloRetryRequest | Flight | + cookie +--------+ +--------+ ClientHello | Flight | + cookie --------> +--------+ ServerHello {EncryptedExtensions} +--------+ {CertificateRequest*} | Flight | {Certificate*} +--------+ {CertificateVerify*} {Finished} <-------- [Application Data*] {Certificate*} +--------+ {CertificateVerify*} | Flight | {Finished} --------> +--------+ [Application Data] +--------+ <-------- [ACK] | Flight | [Application Data*] +--------+ [Application Data] <-------> [Application Data] ]]>

Message Flights for Resumption and PSK Handshake (without Cookie Exchange) ServerHello + pre_shared_key +--------+ + key_share* | Flight | {EncryptedExtensions} +--------+ <-------- {Finished} [Application Data*] +--------+ {Finished} --------> | Flight | [Application Data*] +--------+ +--------+ <-------- [ACK] | Flight | [Application Data*] +--------+ [Application Data] <-------> [Application Data] ]]>

Message Flights for the Zero-RTT Handshake ServerHello + pre_shared_key + key_share* +--------+ {EncryptedExtensions} | Flight | {Finished} +--------+ <-------- [Application Data*] +--------+ {Finished} --------> | Flight | [Application Data*] +--------+ +--------+ <-------- [ACK] | Flight | [Application Data*] +--------+ [Application Data] <-------> [Application Data] ]]>

Message Flights for the NewSessionTicket Message | Flight | +--------+ ]]> KeyUpdate, NewConnectionId, and RequestConnectionId follow a similar pattern to NewSessionTicket: a single message sent by one side followed by an ACK by the other.

Timeout and Retransmission

State Machine DTLS uses a simple timeout and retransmission scheme with the state machine shown in .

DTLS Timeout and Retransmission State Machine | | | | | | +-----------+ | | | | Buffer next flight | | | \|/ | +-----------+ | | | | | SENDING |<------------------+ | | | | | +-----------+ | Receive | | | next | | Send flight or partial | flight | | flight | | | | | | Set retransmit timer | | \|/ | | +-----------+ | | | | | +------------| WAITING |-------------------+ | +----->| | Timer expires | | | +-----------+ | | | | | | | | | | | | | | +----------+ | +--------------------+ | Receive record | Read retransmit or ACK Receive | (Maybe Send ACK) | last | | flight | | Receive ACK | | for last flight \|/ | | +-----------+ | | | <---------+ | FINISHED | | | +-----------+ | /|\ | | | | +---+ Server read retransmit Retransmit ACK ]]> The state machine has four basic states: PREPARING, SENDING, WAITING, and FINISHED. In the PREPARING state, the implementation does whatever computations are necessary to prepare the next flight of messages. It then buffers them up for transmission (emptying the transmission buffer first) and enters the SENDING state. In the SENDING state, the implementation transmits the buffered flight of messages. If the implementation has received one or more ACKs (see ) from the peer, then it SHOULD omit any messages or message fragments which have already been acknowledged. Once the messages have been sent, the implementation then sets a retransmit timer and enters the WAITING state. There are four ways to exit the WAITING state:

The retransmit timer expires: the implementation transitions to the SENDING state, where it retransmits the flight, adjusts and re-arms the retransmit timer (see ), and returns to the WAITING state.
The implementation reads an ACK from the peer: upon receiving an ACK for a partial flight (as mentioned in ), the implementation transitions to the SENDING state, where it retransmits the unacknowledged portion of the flight, adjusts and re-arms the retransmit timer, and returns to the WAITING state. Upon receiving an ACK for a complete flight, the implementation cancels all retransmissions and either remains in WAITING, or, if the ACK was for the final flight, transitions to FINISHED.
The implementation reads a retransmitted flight from the peer when none of the messages that it sent in response to that flight have been acknowledged: the implementation transitions to the SENDING state, where it retransmits the flight, adjusts and re-arms the retransmit timer, and returns to the WAITING state. The rationale here is that the receipt of a duplicate message is the likely result of timer expiry on the peer and therefore suggests that part of one's previous flight was lost.
The implementation receives some or all of the next flight of messages: if this is the final flight of messages, the implementation transitions to FINISHED. If the implementation needs to send a new flight, it transitions to the PREPARING state. Partial reads (whether partial messages or only some of the messages in the flight) may also trigger the implementation to send an ACK, as described in .

Because DTLS clients send the first message (ClientHello), they start in the PREPARING state. DTLS servers start in the WAITING state, but with empty buffers and no retransmit timer. In addition, for at least twice the default MSL defined for , when in the FINISHED state, the server MUST respond to retransmission of the client's final flight with a retransmit of its ACK. Note that because of packet loss, it is possible for one side to be sending application data even though the other side has not received the first side's Finished message. Implementations MUST either discard or buffer all application data records for epoch 3 and above until they have received the Finished message from the peer. Implementations MAY treat receipt of application data with a new epoch prior to receipt of the corresponding Finished message as evidence of reordering or packet loss and retransmit their final flight immediately, shortcutting the retransmission timer.

Timer Values The configuration of timer settings varies with implementations, and certain deployment environments require timer value adjustments. Mishandling of the timer can lead to serious congestion problems -- for example, if many instances of a DTLS time out early and retransmit too quickly on a congested link. Unless implementations have deployment-specific and/or external information about the round trip time, implementations SHOULD use an initial timer value of 1000 ms and double the value at each retransmission, up to no less than 60 seconds (the maximum as specified in RFC 6298 ). Application-specific profiles MAY recommend shorter or longer timer values. For instance:

Profiles for specific deployment environments, such as in low-power, multi-hop mesh scenarios as used in some Internet of Things (IoT) networks, MAY specify longer timeouts. See for more information about one such DTLS 1.3 IoT profile.
Real-time protocols MAY specify shorter timeouts. It is RECOMMENDED that for DTLS-SRTP , a default timeout of 400 ms be used; because customer experience degrades with one-way latencies of greater than 200 ms, real-time deployments are less likely to have long latencies.

In settings where there is external information (for instance, from an ICE handshake, or from previous connections to the same server) about the RTT, implementations SHOULD use 1.5 times that RTT estimate as the retransmit timer. Implementations SHOULD retain the current timer value until a message is transmitted and acknowledged without having to be retransmitted, at which time the value SHOULD be adjusted to 1.5 times the measured round trip time for that message. After a long period of idleness, no less than 10 times the current timer value, implementations MAY reset the timer to the initial value. Note that because retransmission is for the handshake and not dataflow, the effect on congestion of shorter timeouts is smaller than in generic protocols such as TCP or QUIC. Experience with DTLS 1.2, which uses a simpler "retransmit everything on timeout" approach, has not shown serious congestion problems in practice.

Large Flight Sizes DTLS does not have any built-in congestion control or rate control; in general, this is not an issue because messages tend to be small. However, in principle, some messages -- especially Certificate -- can be quite large. If all the messages in a large flight are sent at once, this can result in network congestion. A better strategy is to send out only part of the flight, sending more when messages are acknowledged. Several extensions have been standardized to reduce the size of the Certificate message -- for example, the "cached_info" extension ; certificate compression ; and , which defines the "client_certificate_url" extension allowing DTLS clients to send a sequence of Uniform Resource Locators (URLs) instead of the client certificate. DTLS stacks SHOULD NOT send more than 10 records in a single transmission.

State Machine Duplication for Post-Handshake Messages DTLS 1.3 makes use of the following categories of post-handshake messages:

NewSessionTicket
KeyUpdate
NewConnectionId
RequestConnectionId
Post-handshake client authentication

Messages of each category can be sent independently, and reliability is established via independent state machines, each of which behaves as described in . For example, if a server sends a NewSessionTicket and a CertificateRequest message, two independent state machines will be created. Sending multiple instances of messages of a given category without having completed earlier transmissions is allowed for some categories, but not for others. Specifically, a server MAY send multiple NewSessionTicket messages at once without awaiting ACKs for earlier NewSessionTicket messages first. Likewise, a server MAY send multiple CertificateRequest messages at once without having completed earlier client authentication requests before. In contrast, implementations MUST NOT send KeyUpdate, NewConnectionId, or RequestConnectionId messages if an earlier message of the same type has not yet been acknowledged. Note: Except for post-handshake client authentication, which involves handshake messages in both directions, post-handshake messages are single-flight, and their respective state machines on the sender side reduce to waiting for an ACK and retransmitting the original message. In particular, note that a RequestConnectionId message does not force the receiver to send a NewConnectionId message in reply, and both messages are therefore treated independently. Creating and correctly updating multiple state machines requires feedback from the handshake logic to the state machine layer, indicating which message belongs to which state machine. For example, if a server sends multiple CertificateRequest messages and receives a Certificate message in response, the corresponding state machine can only be determined after inspecting the certificate_request_context field. Similarly, a server sending a single CertificateRequest and receiving a NewConnectionId message in response can only decide that the NewConnectionId message should be treated through an independent state machine after inspecting the handshake message type.

Cryptographic Label Prefix Section 7.1 of specifies that HKDF-Expand-Label uses a label prefix of "tls13 ". For DTLS 1.3, that label SHALL be "dtls13". This ensures key separation between DTLS 1.3 and TLS 1.3. Note that there is no trailing space; this is necessary in order to keep the overall label size inside of one hash iteration because "DTLS" is one letter longer than "TLS".

Alert Messages Note that alert messages are not retransmitted at all, even when they occur in the context of a handshake. However, a DTLS implementation which would ordinarily issue an alert SHOULD generate a new alert message if the offending record is received again (e.g., as a retransmitted handshake message). Implementations SHOULD detect when a peer is persistently sending bad messages and terminate the local connection state after such misbehavior is detected. Note that alerts are not reliably transmitted; implementations SHOULD NOT depend on receiving alerts in order to signal errors or connection closure. Any data received with an epoch/sequence number pair after that of a valid received closure alert MUST be ignored. Note: this is a change from TLS 1.3 which depends on the order of receipt rather than the epoch and sequence number.

Establishing New Associations with Existing Parameters If a DTLS client-server pair is configured in such a way that repeated connections happen on the same host/port quartet, then it is possible that a client will silently abandon one connection and then initiate another with the same parameters (e.g., after a reboot). This will appear to the server as a new handshake with epoch=0. In cases where a server believes it has an existing association on a given host/port quartet and it receives an epoch=0 ClientHello, it SHOULD proceed with a new handshake but MUST NOT destroy the existing association until the client has demonstrated reachability either by completing a cookie exchange or by completing a complete handshake including delivering a verifiable Finished message. After a correct Finished message is received, the server MUST abandon the previous association to avoid confusion between two valid associations with overlapping epochs. The reachability requirement prevents off-path/blind attackers from destroying associations merely by sending forged ClientHellos. Note: It is not always possible to distinguish which association a given record is from. For instance, if the client performs a handshake, abandons the connection, and then immediately starts a new handshake, it may not be possible to tell which connection a given protected record is for. In these cases, trial decryption may be necessary, though implementations could use CIDs to avoid the 5-tuple-based ambiguity.

Example of Handshake with Timeout and Retransmission The following is an example of a handshake with lost packets and retransmissions. Note that the client sends an empty ACK message because it can only acknowledge Record 2 sent by the server once it has processed messages in Record 0 needed to establish epoch 2 keys, which are needed to encrypt or decrypt messages found in Record 2. provides the necessary background details for this interaction. Note: For simplicity, we are not resetting record numbers in this diagram, so "Record 1" is really "Epoch 2, Record 0", etc.

Example DTLS Exchange Illustrating Message Loss ClientHello (message_seq=0) X<----- Record 0 (lost) ServerHello (message_seq=0) Record 1 EncryptedExtensions (message_seq=1) Certificate (message_seq=2) <-------- Record 2 CertificateVerify (message_seq=3) Finished (message_seq=4) Record 1 --------> ACK [] <-------- Record 3 ServerHello (message_seq=0) EncryptedExtensions (message_seq=1) Certificate (message_seq=2) <-------- Record 4 CertificateVerify (message_seq=3) Finished (message_seq=4) Record 2 --------> Certificate (message_seq=1) CertificateVerify (message_seq=2) Finished (message_seq=3) <-------- Record 5 ACK [2] ]]>

Epoch Values and Rekeying A recipient of a DTLS message needs to select the correct keying material in order to process an incoming message. With the possibility of message loss and reordering, an identifier is needed to determine which cipher state has been used to protect the record payload. The epoch value fulfills this role in DTLS. In addition to the TLS 1.3-defined key derivation steps (see Section 7 of ), a sender may want to rekey at any time during the lifetime of the connection. It therefore needs to indicate that it is updating its sending cryptographic keys. This version of DTLS assigns dedicated epoch values to messages in the protocol exchange to allow identification of the correct cipher state:

Epoch value (0) is used with unencrypted messages. There are three unencrypted messages in DTLS, namely ClientHello, ServerHello, and HelloRetryRequest.
Epoch value (1) is used for messages protected using keys derived from client_early_traffic_secret. Note that this epoch is skipped if the client does not offer early data.
Epoch value (2) is used for messages protected using keys derived from [sender]_handshake_traffic_secret. Messages transmitted during the handshake, such as EncryptedExtensions, CertificateRequest, Certificate, CertificateVerify, and Finished, belong to this category. Note, however, that post-handshake messages are protected under the appropriate application traffic key and are not included in this category.
Epoch value (3) is used for payloads protected using keys derived from the initial [sender]_application_traffic_secret_0. This may include handshake messages, such as post-handshake messages (e.g., a NewSessionTicket message).
Epoch values (4 to 2^64-1) are used for payloads protected using keys from the [sender]_application_traffic_secret_N (N>0).

Using these reserved epoch values, a receiver knows what cipher state has been used to encrypt and integrity protect a message. Implementations that receive a record with an epoch value for which no corresponding cipher state can be determined SHOULD handle it as a record which fails deprotection. Note that epoch values do not wrap. If a DTLS implementation would need to wrap the epoch value, it MUST terminate the connection. The traffic key calculation is described in Section 7.3 of . illustrates the epoch values in an example DTLS handshake.

Example DTLS Exchange with Epoch Information Record 0 <-------- HelloRetryRequest (epoch=0) Record 1 ClientHello --------> (epoch=0) Record 1 <-------- ServerHello (epoch=0) {EncryptedExtensions} (epoch=2) {Certificate} (epoch=2) {CertificateVerify} (epoch=2) {Finished} (epoch=2) Record 2 {Certificate} --------> (epoch=2) {CertificateVerify} (epoch=2) {Finished} (epoch=2) Record 2 <-------- [ACK] (epoch=3) Record 3 [Application Data] --------> (epoch=3) Record 3 <-------- [Application Data] (epoch=3) Some time later ... (Post-Handshake Message Exchange) Record 4 <-------- [NewSessionTicket] (epoch=3) Record 4 [ACK] --------> (epoch=3) Some time later ... (Rekeying) Record 5 <-------- [Application Data] (epoch=4) Record 5 [Application Data] --------> (epoch=4) ]]>

ACK Message The ACK message is used by an endpoint to indicate which handshake records it has received and processed from the other side. ACK is not a handshake message but is rather a separate content type, with code point 26. This avoids having ACK being added to the handshake transcript. Note that ACKs can still be sent in the same UDP datagram as handshake records. ; } ACK; ]]>

record_numbers:: A list of the records containing handshake messages in the current flight which the endpoint has received and either processed or buffered, in numerically increasing order.

Implementations MUST NOT acknowledge records containing handshake messages or fragments which have not been processed or buffered. Otherwise, deadlock can ensue. As an example, implementations MUST NOT send ACKs for handshake messages which they discard because they are not the next expected message. During the handshake, ACKs only cover the current outstanding flight (this is possible because DTLS is generally a lock-step protocol). In particular, receiving a message from a handshake flight implicitly acknowledges all messages from the previous flight(s). Accordingly, an ACK from the server would not cover both the ClientHello and the client's Certificate message, because the ClientHello and client Certificate are in different flights. Implementations can accomplish this by clearing their ACK list upon receiving the start of the next flight. For post-handshake messages, ACKs SHOULD be sent once for each received and processed handshake record (potentially subject to some delay) and MAY cover more than one flight. This includes records containing messages which are discarded because a previous copy has been received. During the handshake, ACK records MUST be sent with an epoch which is equal to or higher than the record which is being acknowledged. Note that some care is required when processing flights spanning multiple epochs. For instance, if the client receives only the ServerHello and Certificate and wishes to ACK them in a single record, it must do so in epoch 2, as it is required to use an epoch greater than or equal to 2 and cannot yet send with any greater epoch. Implementations SHOULD simply use the highest current sending epoch, which will generally be the highest available. The exception is that implementations MUST NOT send ACK records in epoch 1 (early data). If the highest current sending epoch is epoch 1 (early data), implementations MUST use epoch 0 (unencrypted) to send ACK records. After the handshake, implementations MUST use the highest available sending epoch.

Sending ACKs When an implementation detects a disruption in the receipt of the current incoming flight, it SHOULD generate an ACK that covers the messages from that flight which it has received and processed so far. Implementations have some discretion about which events to treat as signs of disruption, but it is RECOMMENDED that they generate ACKs under two circumstances:

When they receive a message or fragment which is out of order, either because it is not the next expected message or because it is not the next piece of the current message.
When they have received part of a flight and do not immediately receive the rest of the flight (which may be in the same UDP datagram). "Immediately" is hard to define. One approach is to set a timer for 1/4 the current retransmit timer value when the first record in the flight is received and then send an ACK when that timer expires. Note: The 1/4 value here is somewhat arbitrary. Given that the round trip estimates in the DTLS handshake are generally very rough (or the default), any value will be an approximation, and there is an inherent compromise due to competition between retransmission due to over-aggressive ACKing and over-aggressive timeout-based retransmission. As a comparison point, QUIC's loss-based recovery algorithms (Section 6.1.2 of ) work out to a delay of about 1/3 of the retransmit timer.

In general, flights MUST be ACKed unless they are implicitly acknowledged. In the present specification, the following flights are implicitly acknowledged by the receipt of the next flight, which generally immediately follows the flight:

Handshake flights other than the client's final flight of the main handshake.
The server's post-handshake CertificateRequest.

ACKs SHOULD NOT be sent for these flights unless the responding flight cannot be generated immediately. All other flights MUST be ACKed. In this case, implementations MAY send explicit ACKs for the complete received flight even though it will eventually also be implicitly acknowledged through the responding flight. A notable example for this is the case of client authentication in constrained environments, where generating the CertificateVerify message can take considerable time on the client. Implementations MAY acknowledge the records corresponding to each transmission of each flight or simply acknowledge the most recent one. In general, implementations SHOULD ACK as many received packets as can fit into the ACK record, as this provides the most complete information and thus reduces the chance of spurious retransmission; if space is limited, implementations SHOULD favor including records which have not yet been acknowledged. Note: While some post-handshake messages follow a request/response pattern, this does not necessarily imply receipt. For example, a KeyUpdate sent in response to a KeyUpdate with request_update set to "update_requested" does not implicitly acknowledge the earlier KeyUpdate message because the two KeyUpdate messages might have crossed in flight. ACKs MUST NOT be sent for records of any content type other than handshake or for records which cannot be deprotected. Note that in some cases it may be necessary to send an ACK which does not contain any record numbers. For instance, a client might receive an EncryptedExtensions message prior to receiving a ServerHello. Because it cannot decrypt the EncryptedExtensions, it cannot safely acknowledge it (as it might be damaged). If the client does not send an ACK, the server will eventually retransmit its first flight, but this might take far longer than the actual round trip time between client and server. Having the client send an empty ACK shortcuts this process.

Receiving ACKs When an implementation receives an ACK, it SHOULD record that the messages or message fragments sent in the records being ACKed were received and omit them from any future retransmissions. Upon receipt of an ACK that leaves it with only some messages from a flight having been acknowledged, an implementation SHOULD retransmit the unacknowledged messages or fragments. Note that this requires implementations to track which messages appear in which records. Once all the messages in a flight have been acknowledged, the implementation MUST cancel all retransmissions of that flight. Implementations MUST treat a record as having been acknowledged if it appears in any ACK; this prevents spurious retransmission in cases where a flight is very large and the receiver is forced to elide acknowledgements for records which have already been ACKed. As noted above, the receipt of any record responding to a given flight MUST be taken as an implicit acknowledgement for the entire flight to which it is responding.

Design Rationale ACK messages are used in two circumstances, namely:

On sign of disruption, or lack of progress; and
To indicate complete receipt of the last flight in a handshake.

In the first case, the use of the ACK message is optional, because the peer will retransmit in any case and therefore the ACK just allows for selective or early retransmission, as opposed to the timeout-based whole flight retransmission in previous versions of DTLS. When DTLS 1.3 is used in deployments with lossy networks, such as low-power, long-range radio networks as well as low-power mesh networks, the use of ACKs is recommended. The use of the ACK for the second case is mandatory for the proper functioning of the protocol. For instance, the ACK message sent by the client in Figure 13 acknowledges receipt and processing of Record 4 (containing the NewSessionTicket message), and if it is not sent, the server will continue retransmission of the NewSessionTicket indefinitely until its maximum retransmission count is reached.

Key Updates As with TLS 1.3, DTLS 1.3 implementations send a KeyUpdate message to indicate that they are updating their sending keys. As with other handshake messages with no built-in response, KeyUpdates MUST be acknowledged. In order to facilitate epoch reconstruction (), implementations MUST NOT send records with the new keys or send a new KeyUpdate until the previous KeyUpdate has been acknowledged (this avoids having too many epochs in active use). Due to loss and/or reordering, DTLS 1.3 implementations may receive a record with an older epoch than the current one (the requirements above preclude receiving a newer record). They SHOULD attempt to process those records with that epoch (see for information on determining the correct epoch) but MAY opt to discard such out-of-epoch records. Due to the possibility of an ACK message for a KeyUpdate being lost and thereby preventing the sender of the KeyUpdate from updating its keying material, receivers MUST retain the pre-update keying material until receipt and successful decryption of a message using the new keys. shows an example exchange illustrating that successful ACK processing updates the keys of the KeyUpdate message sender, which is reflected in the change of epoch values.

Example DTLS Key Update (epoch=3) <-------- [Application Data] (epoch=3) /-------------------------------------------\ | | | Some time later ... | \-------------------------------------------/ [Application Data] --------> (epoch=3) [KeyUpdate] (+ update_requested --------> (epoch 3) <-------- [Application Data] (epoch=3) [ACK] <-------- (epoch=3) [Application Data] (epoch=4) --------> <-------- [KeyUpdate] (epoch=3) [ACK] --------> (epoch=4) <-------- [Application Data] (epoch=4) ]]> With a 128-bit key as in AES-128, rekeying 2^64 times has a high probability of key reuse within a given connection. Note that even if the key repeats, the IV is also independently generated. In order to provide an extra margin of security, sending implementations MUST NOT allow the epoch to exceed 2^48-1. In order to allow this value to be changed later, receiving implementations MUST NOT enforce this rule. If a sending implementation receives a KeyUpdate with request_update set to "update_requested", it MUST NOT send its own KeyUpdate if that would cause it to exceed these limits and SHOULD instead ignore the "update_requested" flag. Note: this overrides the requirement in TLS 1.3 to always send a KeyUpdate in response to "update_requested".

Connection ID Updates If the client and server have negotiated the "connection_id" extension , either side can send a new CID that it wishes the other side to use in a NewConnectionId message. ; struct { ConnectionId cids<0..2^16-1>; ConnectionIdUsage usage; } NewConnectionId; ]]>

cids:: Indicates the set of CIDs that the sender wishes the peer to use.
usage:: Indicates whether the new CIDs should be used immediately or are spare. If usage is set to "cid_immediate", then one of the new CIDs MUST be used immediately for all future records. If it is set to "cid_spare", then either an existing or new CID MAY be used.

Endpoints SHOULD use receiver-provided CIDs in the order they were provided. Implementations which receive more spare CIDs than they wish to maintain MAY simply discard any extra CIDs. Endpoints MUST NOT have more than one NewConnectionId message outstanding. Implementations which either did not negotiate the "connection_id" extension or which have negotiated receiving an empty CID MUST NOT send NewConnectionId. Implementations MUST NOT send RequestConnectionId when sending an empty Connection ID. Implementations which detect a violation of these rules MUST terminate the connection with an "unexpected_message" alert. Implementations SHOULD use a new CID whenever sending on a new path and SHOULD request new CIDs for this purpose if path changes are anticipated.

num_cids:: The number of CIDs desired.

Endpoints SHOULD respond to RequestConnectionId by sending a NewConnectionId with usage "cid_spare" containing num_cids CIDs as soon as possible. Endpoints MUST NOT send a RequestConnectionId message when an existing request is still unfulfilled; this implies that endpoints need to request new CIDs well in advance. An endpoint MAY handle requests which it considers excessive by responding with a NewConnectionId message containing fewer than num_cids CIDs, including no CIDs at all. Endpoints MAY handle an excessive number of RequestConnectionId messages by terminating the connection using a "too_many_cids_requested" (alert number 52) alert. Endpoints MUST NOT send either of these messages if they did not negotiate a CID. If an implementation receives these messages when CIDs were not negotiated, it MUST abort the connection with an "unexpected_message" alert.

Connection ID Example Below is an example exchange for DTLS 1.3 using a single CID in each direction. Note: The "connection_id" extension, which is used in ClientHello and ServerHello messages, is defined in .

Example DTLS 1.3 Exchange with CIDs <-------- HelloRetryRequest (cookie) ClientHello --------> (connection_id=5) + cookie <-------- ServerHello (connection_id=100) EncryptedExtensions (cid=5) Certificate (cid=5) CertificateVerify (cid=5) Finished (cid=5) Certificate --------> (cid=100) CertificateVerify (cid=100) Finished (cid=100) <-------- ACK (cid=5) Application Data ========> (cid=100) <======== Application Data (cid=5) ]]> If no CID is negotiated, then the receiver MUST reject any records it receives that contain a CID.

Application Data Protocol Application data messages are carried by the record layer and are split into records and encrypted based on the current connection state. The messages are treated as transparent data to the record layer.

Security Considerations Security issues are discussed primarily in . The primary additional security consideration raised by DTLS is that of denial of service by excessive resource consumption. DTLS includes a cookie exchange designed to protect against denial of service. However, implementations that do not use this cookie exchange are still vulnerable to DoS. In particular, DTLS servers that do not use the cookie exchange may be used as attack amplifiers even if they themselves are not experiencing DoS. Therefore, DTLS servers SHOULD use the cookie exchange unless there is good reason to believe that amplification is not a threat in their environment. Clients MUST be prepared to do a cookie exchange with every handshake. Some key properties required of the cookie for the cookie-exchange mechanism to be functional are described in Section 3.3 of :

The cookie MUST depend on the client's address.
It MUST NOT be possible for anyone other than the issuing entity to generate cookies that are accepted as valid by that entity. This typically entails an integrity check based on a secret key.
Cookie generation and verification are triggered by unauthenticated parties, and as such their resource consumption needs to be restrained in order to avoid having the cookie-exchange mechanism itself serve as a DoS vector.

Although the cookie must allow the server to produce the right handshake transcript, it SHOULD be constructed so that knowledge of the cookie is insufficient to reproduce the ClientHello contents. Otherwise, this may create problems with future extensions such as Encrypted Client Hello . When cookies are generated using a keyed authentication mechanism, it should be possible to rotate the associated secret key, so that temporary compromise of the key does not permanently compromise the integrity of the cookie-exchange mechanism. Though this secret is not as high-value as, e.g., a session-ticket-encryption key, rotating the cookie-generation key on a similar timescale would ensure that the key rotation functionality is exercised regularly and thus in working order. The cookie exchange provides address validation during the handshake. DTLS with Connection IDs allows for endpoint addresses to change during the association; any such updated addresses are not covered by the cookie exchange during the handshake. DTLS implementations MUST NOT update the address they send to in response to packets from a different address unless they first perform some reachability test; no such test is defined in this specification and a future specification would need to specify a complete procedure for how and when to update addresses. Even with such a test, an active on-path adversary can also black-hole traffic or create a reflection attack against third parties because a DTLS peer has no means to distinguish a genuine address update event (for example, due to a NAT rebinding) from one that is malicious. This attack is of concern when there is a large asymmetry of request/response message sizes. With the exception of order protection and non-replayability, the security guarantees for DTLS 1.3 are the same as TLS 1.3. While TLS always provides order protection and non-replayability, DTLS does not provide order protection and may not provide replay protection. Unlike TLS implementations, DTLS implementations SHOULD NOT respond to invalid records by terminating the connection. TLS 1.3 requires replay protection for 0-RTT data (or rather, for connections that use 0-RTT data; see Section 8 of ). DTLS provides an optional per-record replay-protection mechanism, since datagram protocols are inherently subject to message reordering and replay. These two replay-protection mechanisms are orthogonal, and neither mechanism meets the requirements for the other. DTLS 1.3's handshake transcript does not include the new DTLS fields, which makes it have the same format as TLS 1.3. However, the DTLS 1.3 and TLS 1.3 transcripts are disjoint because they use different version numbers. Additionally, the DTLS 1.3 key schedule uses a different label and so will produce different keys for the same transcript. The security and privacy properties of the CID for DTLS 1.3 build on top of what is described for DTLS 1.2 in . There are, however, several differences:

In both versions of DTLS, extension negotiation is used to agree on the use of the CID feature and the CID values. In both versions, the CID is carried in the DTLS record header (if negotiated). However, the way the CID is included in the record header differs between the two versions.
The use of the post-handshake message allows the client and the server to update their CIDs, and those values are exchanged with confidentiality protection.
The ability to use multiple CIDs allows for improved privacy properties in multihomed scenarios. When only a single CID is in use on multiple paths from such a host, an adversary can correlate the communication interaction across paths, which adds further privacy concerns. In order to prevent this, implementations SHOULD attempt to use fresh CIDs whenever they change local addresses or ports (though this is not always possible to detect). The RequestConnectionId message can be used by a peer to ask for new CIDs to ensure that a pool of suitable CIDs is available.
The mechanism for encrypting sequence numbers () prevents trivial tracking by on-path adversaries that attempt to correlate the pattern of sequence numbers received on different paths; such tracking could occur even when different CIDs are used on each path, in the absence of sequence number encryption. Switching CIDs based on certain events, or even regularly, helps against tracking by on-path adversaries. Note that sequence number encryption is used for all encrypted DTLS 1.3 records irrespective of whether a CID is used or not. Unlike the sequence number, the epoch is not encrypted because it acts as a key identifier, which may improve correlation of packets from a single connection across different network paths.
DTLS 1.3 encrypts handshake messages much earlier than in previous DTLS versions. Therefore, less information identifying the DTLS client, such as the client certificate, is available to an on-path adversary.

Changes since DTLS 1.2 Since TLS 1.3 introduces a large number of changes with respect to TLS 1.2, the list of changes from DTLS 1.2 to DTLS 1.3 is equally large. For this reason, this section focuses on the most important changes only.

New handshake pattern, which leads to a shorter message exchange.
Only AEAD ciphers are supported. Additional data calculation has been simplified.
Removed support for weaker and older cryptographic algorithms.
HelloRetryRequest of TLS 1.3 used instead of HelloVerifyRequest.
More flexible cipher suite negotiation.
New session resumption mechanism.
PSK authentication redefined.
New key derivation hierarchy utilizing a new key derivation construct.
Improved version negotiation.
Optimized record layer encoding and thereby its size.
Added CID functionality.
Sequence numbers are encrypted.

Updates Affecting DTLS 1.2 This document defines several changes that optionally affect implementations of DTLS 1.2, including those which do not also support DTLS 1.3.

A version downgrade protection mechanism as described in , Section 4.1.3 and applying to DTLS as described in .
The updates described in , Section 1.3.
The new compliance requirements described in , Section 9.3.

IANA Considerations IANA has allocated the content type value 26 in the "TLS ContentType" registry for the ACK message, defined in . The value for the "DTLS-OK" column is "Y". IANA has reserved the content type range 32-63 so that content types in this range are not allocated. IANA has allocated value 52 for the "too_many_cids_requested" alert in the "TLS Alerts" registry. The value for the "DTLS-OK" column is "Y". IANA has allocated two values in the "TLS HandshakeType" registry, defined in , for request_connection_id (9) and new_connection_id (10), as defined in this document. The value for the "DTLS-OK" column is "Y". IANA has added this RFC as a reference to the "TLS Cipher Suites" registry along with the following Note:

References Normative References User Datagram Protocol Key words for use in RFCs to Indicate Requirement Levels In many standards track documents several words are used to signify the requirements in the specification. These words are often capitalized. This document defines these words as they should be interpreted in IETF documents. This document specifies an Internet Best Current Practices for the Internet Community, and requests discussion and suggestions for improvements. Path MTU discovery This memo describes a technique for dynamically discovering the maximum transmission unit (MTU) of an arbitrary internet path. It specifies a small change to the way routers generate one type of ICMP message. For a path that passes through a router that has not been so changed, this technique might not discover the correct Path MTU, but it will always choose a Path MTU as accurate as, and in many cases more accurate than, the Path MTU that would be chosen by current practice. [STANDARDS-TRACK] Internet Control Message Protocol (ICMPv6) for the Internet Protocol Version 6 (IPv6) Specification This document describes the format of a set of control messages used in ICMPv6 (Internet Control Message Protocol). ICMPv6 is the Internet Control Message Protocol for Internet Protocol version 6 (IPv6). [STANDARDS-TRACK] Packetization Layer Path MTU Discovery This document describes a robust method for Path MTU Discovery (PMTUD) that relies on TCP or some other Packetization Layer to probe an Internet path with progressively larger packets. This method is described as an extension to RFC 1191 and RFC 1981, which specify ICMP-based Path MTU Discovery for IP versions 4 and 6, respectively. [STANDARDS-TRACK] Transmission Control Protocol Computing TCP's Retransmission Timer This document defines the standard algorithm that Transmission Control Protocol (TCP) senders are required to use to compute and manage their retransmission timer. It expands on the discussion in Section 4.2.3.1 of RFC 1122 and upgrades the requirement of supporting the algorithm from a SHOULD to a MUST. This document obsoletes RFC 2988. [STANDARDS-TRACK] Ambiguity of Uppercase vs Lowercase in RFC 2119 Key Words RFC 2119 specifies common key words that may be used in protocol specifications. This document aims to reduce the ambiguity by clarifying that only UPPERCASE usage of the key words have the defined special meanings. Connection Identifier for DTLS 1.2 This document specifies the Connection ID (CID) construct for the Datagram Transport Layer Security (DTLS) protocol version 1.2. A CID is an identifier carried in the record layer header that gives the recipient additional information for selecting the appropriate security association. In "classical" DTLS, selecting a security association of an incoming DTLS record is accomplished with the help of the 5-tuple. If the source IP address and/or source port changes during the lifetime of an ongoing DTLS session, then the receiver will be unable to locate the correct security context. The new ciphertext record format with the CID also provides content type encryption and record layer padding. This document updates RFC 6347. The Transport Layer Security (TLS) Protocol Version 1.3 This document specifies version 1.3 of the Transport Layer Security (TLS) protocol. TLS allows client/server applications to communicate over the Internet in a way that is designed to prevent eavesdropping, tampering, and message forgery. This document updates RFCs 5705 and 6066, and obsoletes RFCs 5077, 5246, and 6961. This document also specifies new requirements for TLS 1.2 implementations. ChaCha20 and Poly1305 for IETF Protocols This document defines the ChaCha20 stream cipher as well as the use of the Poly1305 authenticator, both as stand-alone algorithms and as a "combined mode", or Authenticated Encryption with Associated Data (AEAD) algorithm. RFC 7539, the predecessor of this document, was meant to serve as a stable reference and an implementation guide. It was a product of the Crypto Forum Research Group (CFRG). This document merges the errata filed against RFC 7539 and adds a little text to the Security Considerations section. Informative References Internet Key Exchange Protocol Version 2 (IKEv2) This document describes version 2 of the Internet Key Exchange (IKE) protocol. IKE is a component of IPsec used for performing mutual authentication and establishing and maintaining Security Associations (SAs). This document obsoletes RFC 5996, and includes all of the errata for it. It advances IKEv2 to be an Internet Standard. Photuris: Session-Key Management Protocol This document defines the basic protocol mechanisms. This document defines an Experimental Protocol for the Internet community. IP Encapsulating Security Payload (ESP) This document describes an updated version of the Encapsulating Security Payload (ESP) protocol, which is designed to provide a mix of security services in IPv4 and IPv6. ESP is used to provide confidentiality, data origin authentication, connectionless integrity, an anti-replay service (a form of partial sequence integrity), and limited traffic flow confidentiality. This document obsoletes RFC 2406 (November 1998). [STANDARDS-TRACK] Datagram Congestion Control Protocol (DCCP) The Datagram Congestion Control Protocol (DCCP) is a transport protocol that provides bidirectional unicast connections of congestion-controlled unreliable datagrams. DCCP is suitable for applications that transfer fairly large amounts of data and that can benefit from control over the tradeoff between timeliness and reliability. [STANDARDS-TRACK] The Transport Layer Security (TLS) Protocol Version 1.1 This document specifies Version 1.1 of the Transport Layer Security (TLS) protocol. The TLS protocol provides communications security over the Internet. The protocol allows client/server applications to communicate in a way that is designed to prevent eavesdropping, tampering, or message forgery. Datagram Transport Layer Security This document specifies Version 1.0 of the Datagram Transport Layer Security (DTLS) protocol. The DTLS protocol provides communications privacy for datagram protocols. The protocol allows client/server applications to communicate in a way that is designed to prevent eavesdropping, tampering, or message forgery. The DTLS protocol is based on the Transport Layer Security (TLS) protocol and provides equivalent security guarantees. Datagram semantics of the underlying transport are preserved by the DTLS protocol. Datagram Transport Layer Security (DTLS) over the Datagram Congestion Control Protocol (DCCP) This document specifies the use of Datagram Transport Layer Security (DTLS) over the Datagram Congestion Control Protocol (DCCP). DTLS provides communications privacy for applications that use datagram transport protocols and allows client/server applications to communicate in a way that is designed to prevent eavesdropping and detect tampering or message forgery. DCCP is a transport protocol that provides a congestion-controlled unreliable datagram service. [STANDARDS-TRACK] The Transport Layer Security (TLS) Protocol Version 1.2 This document specifies Version 1.2 of the Transport Layer Security (TLS) protocol. The TLS protocol provides communications security over the Internet. The protocol allows client/server applications to communicate in a way that is designed to prevent eavesdropping, tampering, or message forgery. [STANDARDS-TRACK] Datagram Transport Layer Security Version 1.2 This document specifies version 1.2 of the Datagram Transport Layer Security (DTLS) protocol. The DTLS protocol provides communications privacy for datagram protocols. The protocol allows client/server applications to communicate in a way that is designed to prevent eavesdropping, tampering, or message forgery. The DTLS protocol is based on the Transport Layer Security (TLS) protocol and provides equivalent security guarantees. Datagram semantics of the underlying transport are preserved by the DTLS protocol. This document updates DTLS 1.0 to work with TLS version 1.2. [STANDARDS-TRACK] Recommendations for Secure Use of Transport Layer Security (TLS) and Datagram Transport Layer Security (DTLS) Transport Layer Security (TLS) and Datagram Transport Layer Security (DTLS) are widely used to protect data exchanged over application protocols such as HTTP, SMTP, IMAP, POP, SIP, and XMPP. Over the last few years, several serious attacks on TLS have emerged, including attacks on its most commonly used cipher suites and their modes of operation. This document provides recommendations for improving the security of deployed services that use TLS and DTLS. The recommendations are applicable to the majority of use cases. Datagram Transport Layer Security (DTLS) for Stream Control Transmission Protocol (SCTP) This document describes the usage of the Datagram Transport Layer Security (DTLS) protocol over the Stream Control Transmission Protocol (SCTP). DTLS over SCTP provides communications privacy for applications that use SCTP as their transport protocol and allows client/server applications to communicate in a way that is designed to prevent eavesdropping and detect tampering or message forgery. Applications using DTLS over SCTP can use almost all transport features provided by SCTP and its extensions. [STANDARDS-TRACK] Limits on Authenticated Encryption Use in TLS Robust Channels: Handling Unreliable Networks in the Record Layers of QUIC and DTLS 1.3 Deprecating TLS 1.0 and TLS 1.1 Dell EMC Trinity College Dublin This document formally deprecates Transport Layer Security (TLS) versions 1.0 (RFC 2246) and 1.1 (RFC 4346). Accordingly, those documents have been moved to Historic status. These versions lack support for current and recommended cryptographic algorithms and mechanisms, and various government and industry profiles of applications using TLS now mandate avoiding these old TLS versions. TLS version 1.2 became the recommended version for IETF protocols in 2008 (subsequently being obsoleted by TLS version 1.3 in 2018), providing sufficient time to transition away from older versions. Removing support for older versions from implementations reduces the attack surface, reduces opportunity for misconfiguration, and streamlines library and product maintenance. This document also deprecates Datagram TLS (DTLS) version 1.0 (RFC 4347) but not DTLS version 1.2, and there is no DTLS version 1.1. This document updates many RFCs that normatively refer to TLS version 1.0 or TLS version 1.1, as described herein. This document also updates the best practices for TLS usage in RFC 7525; hence, it is part of BCP 195. Framework for Establishing a Secure Real-time Transport Protocol (SRTP) Security Context Using Datagram Transport Layer Security (DTLS) This document specifies how to use the Session Initiation Protocol (SIP) to establish a Secure Real-time Transport Protocol (SRTP) security context using the Datagram Transport Layer Security (DTLS) protocol. It describes a mechanism of transporting a fingerprint attribute in the Session Description Protocol (SDP) that identifies the key that will be presented during the DTLS handshake. The key exchange travels along the media path as opposed to the signaling path. The SIP Identity mechanism can be used to protect the integrity of the fingerprint attribute from modification by intermediate proxies. [STANDARDS-TRACK] Multiplexing Scheme Updates for Secure Real-time Transport Protocol (SRTP) Extension for Datagram Transport Layer Security (DTLS) This document defines how Datagram Transport Layer Security (DTLS), Real-time Transport Protocol (RTP), RTP Control Protocol (RTCP), Session Traversal Utilities for NAT (STUN), Traversal Using Relays around NAT (TURN), and ZRTP packets are multiplexed on a single receiving socket. It overrides the guidance from RFC 5764 ("SRTP Extension for DTLS"), which suffered from four issues described and fixed in this document. This document updates RFC 5764. Stream Control Transmission Protocol This document obsoletes RFC 2960 and RFC 3309. It describes the Stream Control Transmission Protocol (SCTP). SCTP is designed to transport Public Switched Telephone Network (PSTN) signaling messages over IP networks, but is capable of broader applications. SCTP is a reliable transport protocol operating on top of a connectionless packet network such as IP. It offers the following services to its users: -- acknowledged error-free non-duplicated transfer of user data, -- data fragmentation to conform to discovered path MTU size, -- sequenced delivery of user messages within multiple streams, with an option for order-of-arrival delivery of individual user messages, -- optional bundling of multiple user messages into a single SCTP packet, and -- network-level fault tolerance through supporting of multi-homing at either or both ends of an association. The design of SCTP includes appropriate congestion avoidance behavior and resistance to flooding and masquerade attacks. [STANDARDS-TRACK] Path MTU Discovery for IP version 6 This document describes Path MTU Discovery (PMTUD) for IP version 6. It is largely derived from RFC 1191, which describes Path MTU Discovery for IP version 4. It obsoletes RFC 1981. Interactive Connectivity Establishment (ICE): A Protocol for Network Address Translator (NAT) Traversal This document describes a protocol for Network Address Translator (NAT) traversal for UDP-based communication. This protocol is called Interactive Connectivity Establishment (ICE). ICE makes use of the Session Traversal Utilities for NAT (STUN) protocol and its extension, Traversal Using Relay NAT (TURN). This document obsoletes RFC 5245. TLS/DTLS 1.3 Profiles for the Internet of Things University of Applied Sciences Bonn-Rhein-Sieg Linaro Sandelman Software Works RFC 7925 offers guidance to developers on using TLS/DTLS 1.2 for Internet of Things (IoT) devices with resource constraints. This document is a companion to RFC 7925, defining TLS/DTLS 1.3 profiles for IoT devices. Additionally, it updates RFC 7925 with respect to the X.509 certificate profile and ciphersuite requirements. Datagram Transport Layer Security (DTLS) Extension to Establish Keys for the Secure Real-time Transport Protocol (SRTP) This document describes a Datagram Transport Layer Security (DTLS) extension to establish keys for Secure RTP (SRTP) and Secure RTP Control Protocol (SRTCP) flows. DTLS keying happens on the media path, independent of any out-of-band signalling channel present. [STANDARDS-TRACK] Transport Layer Security (TLS) Cached Information Extension Transport Layer Security (TLS) handshakes often include fairly static information, such as the server certificate and a list of trusted certification authorities (CAs). This information can be of considerable size, particularly if the server certificate is bundled with a complete certificate chain (i.e., the certificates of intermediate CAs up to the root CA). This document defines an extension that allows a TLS client to inform a server of cached information, thereby enabling the server to omit already available information. TLS Certificate Compression In TLS handshakes, certificate chains often take up the majority of the bytes transmitted. This document describes how certificate chains can be compressed to reduce the amount of data transmitted and avoid some round trips. Transport Layer Security (TLS) Extensions: Extension Definitions This document provides specifications for existing TLS extensions. It is a companion document for RFC 5246, "The Transport Layer Security (TLS) Protocol Version 1.2". The extensions specified are server_name, max_fragment_length, client_certificate_url, trusted_ca_keys, truncated_hmac, and status_request. [STANDARDS-TRACK] QUIC Loss Detection and Congestion Control This document describes loss detection and congestion control mechanisms for QUIC. TLS Encrypted Client Hello Independent Fastly Cryptography Consulting LLC Cloudflare This document describes a mechanism in Transport Layer Security (TLS) for encrypting a ClientHello message under a server public key. Discussion Venues This note is to be removed before publishing as an RFC. Source for this draft and an issue tracker can be found at https://github.com/tlswg/draft-ietf-tls-esni (https://github.com/tlswg/draft-ietf-tls-esni). On the Security of CTR + CBC-MAC Springer Berlin Heidelberg Usage Limits on AEAD Algorithms IBM Research Europe - Zurich Mozilla Cloudflare An Authenticated Encryption with Associated Data (AEAD) algorithm provides confidentiality and integrity. Excessive use of the same key can give an attacker advantages in breaking these properties. This document provides simple guidance for users of common AEAD functions about how to limit the use of keys in order to bound the advantage given to an attacker. It considers limits in both single- and multi-key settings. QUIC: A UDP-Based Multiplexed and Secure Transport This document defines the core of the QUIC transport protocol. QUIC provides applications with flow-controlled streams for structured communication, low-latency connection establishment, and network path migration. QUIC includes security measures that ensure confidentiality, integrity, and availability in a range of deployment circumstances. Accompanying documents describe the integration of TLS for key negotiation, loss detection, and an exemplary congestion control algorithm.

Protocol Data Structures and Constant Values This section provides the normative protocol types and constants definitions.

Record Layer

Handshake Protocol ; opaque legacy_cookie<0..2^8-1>; // DTLS CipherSuite cipher_suites<2..2^16-2>; opaque legacy_compression_methods<1..2^8-1>; Extension extensions<8..2^16-1>; } ClientHello; ]]>

ACKs ; } ACK; ]]>

Connection ID Management ; struct { ConnectionId cids<0..2^16-1>; ConnectionIdUsage usage; } NewConnectionId; struct { uint8 num_cids; } RequestConnectionId; ]]>

Analysis of Limits on CCM Usage TLS and do not specify limits on key usage for AEAD_AES_128_CCM. However, any AEAD that is used with DTLS requires limits on use that ensure that both confidentiality and integrity are preserved. This section documents that analysis for AEAD_AES_128_CCM. is used as the basis of this analysis. The results of that analysis are used to derive usage limits that are based on those chosen in . This analysis uses symbols for multiplication (*), division (/), and exponentiation (^), plus parentheses for establishing precedence. The following symbols are also used:

t:: The size of the authentication tag in bits. For this cipher, t is 128.
n:: The size of the block function in bits. For this cipher, n is 128.
l:: The number of blocks in each packet (see below).
q:: The number of genuine packets created and protected by endpoints. This value is the bound on the number of packets that can be protected before updating keys.
v:: The number of forged packets that endpoints will accept. This value is the bound on the number of forged packets that an endpoint can reject before updating keys.

The analysis of AEAD_AES_128_CCM relies on a count of the number of block operations involved in producing each message. For simplicity, and to match the analysis of other AEAD functions in , this analysis assumes a packet length of 2^10 blocks and a packet size limit of 2^14 bytes. For AEAD_AES_128_CCM, the total number of block cipher operations is the sum of: the length of the associated data in blocks, the length of the ciphertext in blocks, and the length of the plaintext in blocks, plus 1. In this analysis, this is simplified to a value of twice the maximum length of a record in blocks (that is, 2l = 2^11). This simplification is based on the associated data being limited to one block.

Confidentiality Limits For confidentiality, Theorem 2 in establishes that an attacker gains a distinguishing advantage over an ideal pseudorandom permutation (PRP) of no more than: For a target advantage in a single-key setting of 2^-60, which matches that used by TLS 1.3, as summarized in , this results in the relation: That is, endpoints cannot protect more than 2^23 packets with the same set of keys without causing an attacker to gain an larger advantage than the target of 2^-60.

Integrity Limits For integrity, Theorem 1 in establishes that an attacker gains an advantage over an ideal PRP of no more than: The goal is to limit this advantage to 2^-57, to match the target in TLS 1.3, as summarized in . As t and n are both 128, the first term is negligible relative to the second, so that term can be removed without a significant effect on the result. This produces the relation: Using the previously established value of 2^23 for q and rounding, this leads to an upper limit on v of 2^23.5. That is, endpoints cannot attempt to authenticate more than 2^23.5 packets with the same set of keys without causing an attacker to gain an larger advantage than the target of 2^-57.

Limits for AEAD_AES_128_CCM_8 The TLS_AES_128_CCM_8_SHA256 cipher suite uses the AEAD_AES_128_CCM_8 function, which uses a short authentication tag (that is, t=64). The confidentiality limits of AEAD_AES_128_CCM_8 are the same as those for AEAD_AES_128_CCM, as this does not depend on the tag length; see . The shorter tag length of 64 bits means that the simplification used in does not apply to AEAD_AES_128_CCM_8. If the goal is to preserve the same margins as other cipher suites, then the limit on forgeries is largely dictated by the first term of the advantage formula: As this represents attempts that fail authentication, applying this limit might be feasible in some environments. However, applying this limit in an implementation intended for general use exposes connections to an inexpensive denial-of-service attack. This analysis supports the view that TLS_AES_128_CCM_8_SHA256 is not suitable for general use. Specifically, TLS_AES_128_CCM_8_SHA256 cannot be used without additional measures to prevent forgery of records, or to mitigate the effect of forgeries. This might require understanding the constraints that exist in a particular deployment or application. For instance, it might be possible to set a different target for the advantage an attacker gains based on an understanding of the constraints imposed on a specific usage of DTLS.

Implementation Pitfalls In addition to the aspects of TLS that have been a source of interoperability and security problems (Appendix C.3 of ), DTLS presents a few new potential sources of issues, noted here.

Do you correctly handle messages received from multiple epochs during a key transition? This includes locating the correct key as well as performing replay detection, if enabled.
Do you retransmit handshake messages that are not (implicitly or explicitly) acknowledged ()?
Do you correctly handle handshake message fragments received, including when they are out of order?
Do you correctly handle handshake messages received out of order? This may include either buffering or discarding them.
Do you limit how much data you send to a peer before its address is validated?
Do you verify that the explicit record length is contained within the datagram in which it is contained?

Contributors Many individuals have contributed to previous versions of DTLS up to 1.2, and their contributions are acknowledged in earlier DTLS specifications or in the referenced documents. The following individuals made significant contributions to RFC 9147: The sequence number encryption concept is taken from QUIC . We would like to thank the authors of RFC 9000 for their work. Felix Günther and Martin Thomson contributed the analysis in . We would like to thank Jonathan Hammell, Bernard Aboba, Nick Harper and Andy Cunningham for their review comments. Finally, we would like to thank the following IESG members for their review comments: Martin Duke, Erik Kline, Francesca Palombini, Lars Eggert, Zaheduzzaman Sarker, John Scudder, Éric Vyncke, Robert Wilton, Roman Danyliw, Benjamin Kaduk, Murray Kucherawy, Martin Vigoureux and Alvaro Retana.