Internet DRAFT - draft-joseph-tls-turbotls
draft-joseph-tls-turbotls
Network Working Group D. Stebila
Internet-Draft University of Waterloo
Intended status: Informational D. Joseph
Expires: 8 May 2024 C. Aguilar-Melchor
J. Goertzen
SandboxAQ
5 November 2023
TurboTLS for faster connection establishment
draft-joseph-tls-turbotls-00
Abstract
This document provides a high level protocol description for
handshaking over UDP in the Transport Layer Security (TLS) protocol
(version independent). In parallel, a TCP session is established,
and once this is done, the TLS session reverts to TCP. In the event
that the UDP handshaking portion fails, TurboTLS falls back to TLS-
over-TCP as is usually done, resulting in negligible latency cost in
the case of failure.
Discussion of this work is encouraged to happen on the TLS IETF
mailing list tls@ietf.org or on the GitHub repository which contains
the draft: https://github.com/PhDJsandboxaq/draft-ietf-turbotls-
design/.
Status of This Memo
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This Internet-Draft will expire on 8 May 2024.
Copyright Notice
Copyright (c) 2023 IETF Trust and the persons identified as the
document authors. All rights reserved.
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This document is subject to BCP 78 and the IETF Trust's Legal
Provisions Relating to IETF Documents (https://trustee.ietf.org/
license-info) in effect on the date of publication of this document.
Please review these documents carefully, as they describe your rights
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Table of Contents
1. Introduction . . . . . . . . . . . . . . . . . . . . . . . . 2
1.1. Terminology . . . . . . . . . . . . . . . . . . . . . . . 3
1.2. Motivation for handshaking over UDP . . . . . . . . . . . 3
1.3. Scope . . . . . . . . . . . . . . . . . . . . . . . . . . 4
1.4. Goals . . . . . . . . . . . . . . . . . . . . . . . . . . 5
2. Transport Layer Security . . . . . . . . . . . . . . . . . . 5
3. Construction for TLS . . . . . . . . . . . . . . . . . . . . 6
3.1. Protocol diagram TLS . . . . . . . . . . . . . . . . . . 6
3.2. Protocol diagram TurboTLS . . . . . . . . . . . . . . . . 7
3.3. Fragmentation . . . . . . . . . . . . . . . . . . . . . . 9
3.3.1. Client request-based fragmentation . . . . . . . . . 10
3.4. TLS-over-TCP fallback . . . . . . . . . . . . . . . . . . 10
3.4.1. Early data, post-handshake messages, and TCP
fallback . . . . . . . . . . . . . . . . . . . . . . 11
3.5. TurboTLS support advertisment . . . . . . . . . . . . . . 11
3.6. Specification: Handshake embedding into UDP . . . . . . . 12
3.7. Specification: UDP Tombstone . . . . . . . . . . . . . . 12
4. Security Considerations . . . . . . . . . . . . . . . . . . . 12
4.1. Transparent proxying . . . . . . . . . . . . . . . . . . 13
4.2. Denial-of-Service . . . . . . . . . . . . . . . . . . . . 13
4.2.1. Attacks _on_ TurboTLS servers . . . . . . . . . . . . 13
4.2.2. Attacks _leveraging_ TurboTLS servers . . . . . . . . 14
5. References . . . . . . . . . . . . . . . . . . . . . . . . . 14
5.1. Normative References . . . . . . . . . . . . . . . . . . 15
5.2. Informative References . . . . . . . . . . . . . . . . . 15
Authors' Addresses . . . . . . . . . . . . . . . . . . . . . . . 16
1. Introduction
This document gives a construction for TurboTLS [ABGGJS23], which at
its core is a method for handshaking over UDP in TLS before switching
back to TCP for the TLS session. A technique called client request-
based fragmentation is described which reduces the susceptability of
TurboTLS servers to being exploited by UDP reflection attacks.
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reduce the possibility of portions of the handshake over UDP being
filtered by poorly configured middle-boxes, and a fallback procedure
to standard TLS-over-TCP (at minimal latency overhead) is provided.
1.1. Terminology
* *UDP* Universal Datagram Protocol: a connectionless transport
protocol, whereby packets are sent, but without any codified way
of knowing that such packets have been successfully received.
This leads to low reliability but can be appropriate where
applications are time sensitive.
* *TCP* Transmission Control Protocol: a connection-oriented
protocol that ensures the successful delivery of packets. Before
a communication over TCP can start in earnest, a connection must
be established. This is done via a TCP handshake consisting of a
SYN, a SYN ACK and an ACK.
* *TLS* Transport Layer Security: a cryptographic protocol that
enables a client and server to authenticate one another, and
communicate confidentially. TLS initializes with a handshake
where cryptographic primitives are executed and session parameters
are agreed upon, and then a session over which applications
exchange encrypted communications.
* *QUIC* (not an acronym): a security protocol that embeds TLS
functionality directly into UDP-based transport. Due to the
drawbacks of UDP, QUIC implements its own reliability, packet
reordering, and packet dropping procedures as well as the security
properties.
1.2. Motivation for handshaking over UDP
TLS is the most ubiquitous application layer security protocol in use
at the time of writing. Other protocols for secure connection
establishment have been proposed, and one such widely-used protocol
is QUIC. QUIC runs entirely over UDP and merges the transport and
security aspects into one specification, handling packet loss,
reordering, handshake establishment, and session management all in
one protocol. One benefit of QUIC is that it enjoys fast connection
establishment because it runs over UDP, whereas running on TCP would
mean waiting for a TCP handshake to occur which requires one round
trip.
Many will make the choice to move from TLS to QUIC, however some will
not for a range of reasons. Deep packet inspection is inhibited in
QUIC, and updating some legacy systems can be difficult. TurboTLS
aims to provide a method for those who do not want to fully switch to
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QUIC, to benefit from the fast connection establishment enabled by
UDP, but without fundamentally changing the security properties of
TLS, and furthermore enabling implementation via transparent
proxying, thus avoiding the need to directly upgrade such systems
themselves.
1.3. Scope
This document focuses on TurboTLS [ABGGJS23]. It covers everything
needed to achieve the handshaking portion of a TLS connection over
UDP, including
* *Construction in principle:* It provides an outline of which flows
are sent over UDP, which are sent over TCP and in what order.
* *TLS-over-TCP fallback:* The document describes what to do in the
case of failure due to UDP packet loss or filtering. The scheme
should revert to TLS-over-TCP incurring a small latency overhead
that should be minimal in comparison with standard TLS-over-TCP
without a TurboTLS attempt.
* *Client request-based fragmentation:* Due to the impact of post-
quantum cryptography such as larger keys certain considerations
have to be taken into account. One is that a Server Hello is
likely to require multiple UDP packets, thus to eliminate the
possibility of reflection attacks and hence serve as a DDoS
mitigation, we describe how to create a one-to-one correspondence
between Client Hello packets and Server Hello packets.
* *How to implement via a transparent proxy:* The document gives a
brief description of how one can implement TurboTLS via a
transparent proxy, which has two implications. The first is that
it demonstrates clearly that the security of TLS is unchanged, as
a server and client can have their entire transcript intercepted
by two proxies (one in front of each), which TurboTLS-ify the
interaction. Thus the view server and client is unchanged versus
standard TLS. The second is that the TLS proxy represents a way
for legacy systems to benefit from faster connection establishment
without requiring direct upgrades.
* *Performance considerations* Due to the parallelization of the UDP
flow and TCP flows, as well as the TCP fallback mechanism,
TurboTLS will have some impact on bandwidth requirements. We
discuss these briefly, as well as the expected benefit from
reducing a round trip when TurboTLS works and the small latency
overhead when it doesn't and reverts to TLS-over-TCP.
It intentionally does not address:
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* *Protocol design of TLS:* The internal workings and security
mechanisms of TLS are not affected by TurboTLS, as can be seen via
the transparent proxying argument. This document does not discuss
the design or merits of any version of TLS.
1.4. Goals
* *High performance:* Successful use of TurboTLS removes one round
trip and should cut handshaking time by up to 50%. However in the
worst case, when the fallback mechanism to TLS-over-TCP is used,
there should be only a minimal impact on latency.
* *Ease of implementation:* TurboTLS should be designed such that it
is possible to implement in many scenarios where other more
invasive upgrades may not be possible, such as switching to QUIC.
Transparent proxying should enable this via network proxies,
sidecar proxies, or directly modifying the client/server
applications.
* *Security:* The design should not create any opportunities for
adversaries, either to attack TurboTLS servers or to use them e.g.
during a reflection attack. The ratio of received:sent UDP
packets, in particular, affects an adversary's chances of carrying
out such reflection attacks. The handling of semi-open TCP
connections is also important to consider in mitigating DoS
attacks.
2. Transport Layer Security
The Transport Layer Security (TLS) protocol is ubiquitous and
provides security services to many network applications. TLS runs
over TCP. As shown in Figure 1, the main flow for TLS 1.3 connection
establishment [TLS13] in a web browser is as follows.
First of all, the client makes a DNS query to convert the requested
domain name into an IP address. Simultaneously, browsers request an
HTTPS resource record [SBN22] from the DNS server which can provide
additional information about the server's HTTPS configuration. Next,
the client and server perform the TCP three-way handshake. Once the
TCP handshake is complete and a TCP connection is established, the
TLS handshake can start; it requires one round trip -- one client-to-
server C->S flow and one server-to-client S->C flow -- before the
client can start transmitting application data.
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In total (not including the DNS resolution) this results in two round
trips before the client can send the first byte of application data
(the TCP handshake, plus the first C->S and S->C flows of the TLS
handshake), and one further round trip before the client receives its
first byte of response.
TLS does have a pre-shared key mode that allows for an abbreviated
handshake permitting application data to be sent in the first C->S
TLS flow, but this requires that the client and server have a pre-
shared key in advance, established either through some out-of-band
mechanism or saved from a previous TLS connection for session
resumption.
3. Construction for TLS
We first demonstrate protocol diagrams of the handshaking parts of
TLS and TurboTLS.
3.1. Protocol diagram TLS
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┌----------┐ ┌----------┐
│TLS client│ │DNS server│
└----------┘ └----------┘
DNS: A request
------------------------------------>
DNS: AAAA request
------------------------------------>
DNS: HTTPS RR request
------------------------------------>
DNS: A response
<------------------------------------
DNS: AAAA response
<------------------------------------
DNS: HTTPS RR response
<------------------------------------
┌----------┐ ┌----------┐
│TLS client│ │TLS server│
└----------┘ └----------┘
TCP: SYN
------------------------------------> │
TCP: SYN-ACK │RT1
<------------------------------------ │
TCP: ACK
------------------------------------> │
TCP: TLS CH │
------------------------------------> │
TCP: TLS SH │RT2
<------------------------------------ │
TCP: TLS app data │
<------------------------------------ │
TCP: TLS *, FIN
------------------------------------> │
TCP: TLS app data │RT3
------------------------------------> │
Figure 1: TLS-over-TCP handshake
3.2. Protocol diagram TurboTLS
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┌----------┐ ┌----------┐
│TLS client│ │DNS server│
└----------┘ └----------┘
DNS: A request
------------------------------------>
DNS: AAAA request
------------------------------------>
DNS: HTTPS RR request
------------------------------------>
DNS: A response
<------------------------------------
DNS: AAAA response
<------------------------------------
DNS: HTTPS RR response w/ TTLS flag
<------------------------------------
┌----------┐ ┌----------┐
│TLS client│ │TLS server│
└----------┘ └----------┘
UDP: TurboTLS id, TLS CH frag#1
------------------------------------> │
UDP: TurboTLS id, TLS CH frag#2 │
------------------------------------> │
UDP: TurboTLS id, empty frag#1 │
------------------------------------> │
UDP: TurboTLS id, empty frag#2 │
------------------------------------> │
│
TCP: SYN │
------------------------------------> │
│RT1
UDP: TurboTLS id, TLS resp frag#1 │
<------------------------------------ │
UDP: TurboTLS id, TLS resp frag#2 │
<------------------------------------ │
UDP: TurboTLS id, TLS resp frag#3 │
<------------------------------------ │
│
TCP: SYN-ACK │
<------------------------------------ │
TCP: ACK
------------------------------------> │
TCP: TurboTLS id, TLS *, FIN │
------------------------------------> │RT2
TCP: TLS app data │
------------------------------------> │
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Figure 2: TurboTLS Handshake
As described in Figure 2, TurboTLS sends part of the TLS handshake
over UDP, rather than TCP. Switching from TCP to UDP for handshake
establishment means we cannot rely on TCP's features, namely
connection-oriented, reliable, in-order delivery. However, since the
rest of the connection will still run over TCP and only part of the
handshake runs over UDP, we can reproduce the required functionality
in a lightweight way without adding latency and allowing for a simple
implementation.
3.3. Fragmentation
One of the major problems to deal with is that of fragmentation. TLS
handshake messages can be too large to fit in a single packet --
especially with long certificate chains or if post-quantum algorithms
are used.
Obviously the client can fragment its first C->S flow across multiple
UDP packets. To allow a server to link fragments received across
multiple UDP requests, we add a 12-byte session ID field, containing
a client-selected random value _id_ that is used across all TurboTLS
fragments sent by the client. The session ID is also included in the
first message on the established TLS connection as part of the
tombstone message to allow the server to link together data received
on the UDP and TCP connections. To allow the server to reassemble
fragments if they arrive out-of-order. The client will send the last
in-order UDP packet it received's sequence number as a part of the
tombstone message so that the server can detect packetloss.
Similarly, the server can fragment its first S->C flow across
multiple UDP packets. One additional problem here however is that
the S->C flow is typically larger than the C->S flow (as it typically
contains one or more certificates), so the server may have to send
more UDP response packets than UDP request packets. As noted by
[SW19] in the context of DNSSEC, many network devices do not behave
well when receiving multiple UDP responses to a single UDP request,
and may close the port after the first packet, dropping the request.
Subsequent packets received at a closed port lead to ICMP failure
alerts, which can be a nuisance.
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3.3.1. Client request-based fragmentation
A method proposed by Goertzen and Stebila [GS22] for DNSSEC is called
request-based fragmentation. In the context of large resource
records in DNSSEC, [GS22] had the first response be a truncated
response that included information about the size of the response,
and then the client sent multiple additional requests, in parallel,
for the remaining fragments. This ensured that there was only one
UDP response for each UDP request.
Maintaining one-to-oneness of UDP packets can prevent reflection
attacks. We therefore offer an adaptation of that method for
TurboTLS: the client can, in its first C->S flow, fragment its own
C->S data across multiple UDP packets. Additionally it sends (in
parallel) enough nearly-empty UDP requests for a predicted upper
bound on the number of fragments the server will need to fit its
response. This preserves the model of each UDP request receiving a
single UDP response reducing the potential for DDoS amplification
attacks.
TODO: we solicit advice on the potential impacts of this method on
middlebox compatibility, and whether the benefit in DDoS protection
is offset by other presently unknown factors.
3.4. TLS-over-TCP fallback
UDP does not have reliable delivery, so packets may be lost. Since
the first TurboTLS round-trip includes the TCP handshake, we can
immediately fall back to TCP if a UDP packet is lost in either
direction. This will induce a latency cost of however long the
client decides to wait for UDP packets to arrive before giving up and
assuming they were lost.
In an implementation, the client delay could be a fixed number of
milliseconds, or could be variable depending on observed network
conditions; this need not be fixed by a standard. We believe that in
many cases a client delay of just 2ms after the TCP reply is received
in the first round trip will be enough to ensure UDP responses are
received a large majority of the time. In other words, by tolerating
a potential 2ms of extra latency on _X%_ of connections, we can save
an entire round-trip on a large proportion _(100-X%)_ of the
connections. This mechanic was not implemented in the experimental
results presented here and constitutes future work.
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3.4.1. Early data, post-handshake messages, and TCP fallback
As part of the TLS 1.3 specification, a server is able to send
encrypted application data and connection maintenance related
messages after it sends its server finished message. One could wait
until the TCP connection is established and is associated with the
correct UDP handshake. This would remove the benefit that TurboTLS
offers as it requires the server to wait for the TCP connection to
finish being established. We therefore propose that all post-
handshake messages and early data message attempt to be transmitted
over UDP. These messages should therefore be wrapped with the
standard TurboTLS headers (session ID and index) to ensure that can
be associated with the correct TLS session. Once the TCP connection
is established, the client's first message should include the index
of the last in order UDP based packet that was received. The server
can then determine what needs to be retransmitted over the reliable
TCP connection.
In the best case scenario, these early data and post-handshake
messages arrive one round trip sooner than they would than in TCP-
based TLS, and in the worst cast arrive at the same time as TCP-based
TLS. However, this fallback method comes at the cost of requiring
additional memory usage by the server to store the messages sent over
UDP until it has verified they have been delivered.
3.5. TurboTLS support advertisment
To protect servers who do not support TurboTLS from being bombarded
with unwanted UDP traffic, it would be preferable if clients only
used TurboTLS with servers that they already know support it.
Clients could cache this information from previous non-TurboTLS
connections, but in fact we can do better. Even on the first visit
to a server, we can communicate server support for TurboTLS to the
client, without an extra round trip, using the HTTPS resource record
in DNS [SBN22]. Today when web browsers perform the DNS lookup for
the domain name in question, they typically send three requests in
parallel: an A query for an IPv4 address, an AAAA query for an IPv6
address, and a query for an HTTPS resource record [SBN22]. Servers
can advertise support for TurboTLS with an additional flag in the
HTTPS resource record and clients can check for it without incurring
any extra latency.
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3.6. Specification: Handshake embedding into UDP
Rather than relying on IP fragmentation, and the issues that may
arise from IP/UDP fragmentation, we fragment at the application layer
and send a new UDP packet each time the packet size would exceed a
predefined _safe_ size. This predefined size will need to account
for the various headers and metadata being sent in each packet. In
DNS, for example, the recommended maximum payload size is 1232 bytes
to account for IPv6, and UDP headers [DNSUDP]. As previously
mentioned, TurboTLS UDP packets contain a session ID, and a sequence
number. These Turbo-headers will be prefixed to the payload of each
UDP packet being set. Both client and server UDP communication
streams have their own distinct sequence counters to maintain
ordering in either direction.
1 1 1 1 1 1
0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5
+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+
| Session ID |Seq. Number|
+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+
/ Payload /
/ /
/ /
/ /
+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+
Figure 3: TurboTLS UDP packet layout
3.7. Specification: UDP Tombstone
As part of joining the UDP and TCP streams together once a TCP
connection is established, the cleint sends a tombstone message as
the first message over TCP. This message contains the session ID as
well as the sequence number of the last in order UDP packet that it
received. The server will then use this message to determine which
handshake a given TCP stream should be associated with, as well as
what data needs to be retransmitted due packet loss.
1 1 1 1 1 1
0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5
+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+
| Session ID |Seq. Number|
+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+--+
Figure 4: TurboTLS tombstone packet layout
4. Security Considerations
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4.1. Transparent proxying
TurboTLS benefits from a nice feature: TurboTLS makes no change
whatsoever to the content of a TLS handshake, only changes the
delivery mechanism. As a result, all cryptographic properties of TLS
are untouched. In fact, it is possible to implement TurboTLS without
changing the client or server's TLS library at all, and instead use
transparent proxies on both the client and server side to change the
network delivery from pure TCP in TLS to UDP+TCP in TurboTLS. Of
course in such a construction the initial client or server, who does
not know TurboTLS, will observe two round trip times, but if each
proxy is close to its host (say on the same machine), then the two
round trip times will be negligible, and the higher latency client--
server distance will only be covered over one round trip.
4.2. Denial-of-Service
We now consider the implications for TurboTLS of various types of
denial-of-service and distributed denial-of-service attacks,
including whether a TurboTLS server is a victim in a DoS attack or
being leveraged by an attacker to direct a DDoS attack elsewhere.
TurboTLS runs on top of both TCP and UDP so we have to consider
attacks involving both protocols.
4.2.1. Attacks _on_ TurboTLS servers
The most significant TCP DoS attack is the SYN flood attack where a
target machine is overwhelmed by TCP SYN messages faster than it can
process them. This is because a server, upon receiving a SYN,
typically stores the source IP, TCP packet index number, and port in
a `SYN queue', and this represents a half-open connection. An
attacker could flood the server with SYN messages thereby exhausting
its memory. The server cannot just arbitrarily drop connections
because then legitimate users may find themselves unable to connect.
There are multiple protections against SYN flood attacks, such as:
* Allocating only very small amounts (micro blocks) of memory to
half-open connections.
* Using TCP cryptographic cookies [Ber05] [Sim11] whereby the
sequence number of the ACK encodes information about the SYN queue
entry so that the server can reconstruct the entry even if it was
not stored due to having a full SYN queue. TCP cookies enjoy
support in the Linux kernel -- this and other such mitigations are
already sufficient to protect TurboTLS from SYN floods.
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In general there are several vectors to consider for resource
exhaustion attacks on a server running TurboTLS. The server needs to
maintain a buffer of received UDP packets containing fragments of a
TLS CH message.
* To avoid memory exhaustion attacks, a server can safely bound the
memory allocated to this buffer and flush old entries on a regular
basis (e.g. after two seconds).
- In the worst case, a legitimate client whose UDP packets are
rejected from a busy server or flushed early will be able to
fall back to vanilla TLS over TCP, and will incur negligible
latency loss (compared to TLS over TCP) in doing so, because
TurboTLS starts the TCP handshake in parallel to the first C->S
UDP flow.
* An attacker spoofing IP addresses and sending well-formed CH
messages could also try to exhaust a server's CPU resources by
causing a large amount of cryptographic computation.
- Again, a server under attack can limit the CPU resources
allocated to UDP-received CH messages, and then fall back to
vanilla TLS over TCP. In the worst case, legitimate clients
affected by this and having to fall back to vanilla TLS over
TCP will incur negligible latency loss compared to TLS over TCP
since the TCP handshake has already been started in parallel.
4.2.2. Attacks _leveraging_ TurboTLS servers
UDP reflection attacks present another threat. Typical defenses
against these are: - blocking unused ports, - rate limiting based on
expected traffic loads from peers (exorbitant traffic loads are
likely to be malicious), - blocking IPs of other known vulnerable
servers. However such defenses are provided by middleboxes and
therefore do not affect the protocol.
The one-to-oneness of the UDP request/response significantly reduces
the impact of any amplification attack which tries to utilize a
TurboTLS server as a reflector: an attacker would have to send one
UDP packet for every reflected packet generated by the server,
meaning that initial requests and responses are of comparable sizes,
making the amplification factor so low that it would be an
ineffective use of resources. Furthermore, the UDP requests
ultimately must contain a fully formed CH before the server responds,
limiting the amplification factor.
5. References
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5.1. Normative References
[ABGGJS23] Carlos Aguilar-Melchor, Thomas Bailleux, Jason Goertzen,
Adrien Guinet, David Joseph, and Douglas Stebila,
"TurboTLS: TLS connection establishment with 1 less round
trip", n.d., <https://arxiv.org/abs/2302.05311>.
[TCP] Postel, J., "Transmission Control Protocol", RFC 793,
DOI 10.17487/RFC0793, September 1981,
<https://www.rfc-editor.org/rfc/rfc793>.
[TLS12] Dierks, T. and E. Rescorla, "The Transport Layer Security
(TLS) Protocol Version 1.2", RFC 5246,
DOI 10.17487/RFC5246, August 2008,
<https://www.rfc-editor.org/rfc/rfc5246>.
[TLS13] Rescorla, E., "The Transport Layer Security (TLS) Protocol
Version 1.3", RFC 8446, DOI 10.17487/RFC8446, August 2018,
<https://www.rfc-editor.org/rfc/rfc8446>.
[UDP] Postel, J., "User Datagram Protocol", STD 6, RFC 768,
DOI 10.17487/RFC0768, August 1980,
<https://www.rfc-editor.org/rfc/rfc768>.
5.2. Informative References
[Ber05] Daniel J Bernstein, "SYN cookies", 1 December 2005,
<https://cr.yp.to/syncookies.html>.
[DNSUDP] Axel Koolhaas and Tjeerd Slokker, "Defragmenting DNS -
Determining the optimal maximum UDP response size for
DNS", 11 September 2020,
<https://indico.dns-oarc.net/event/36/contributions/776/>.
[GS22] Douglas Stebila and Jason Goertzen, "Post-Quantum
Signatures in DNSSEC via Request-Based Fragmentation", 25
November 2022, <https://link.springer.com/
chapter/10.1007/978-3-031-40003-2_20>.
[SBN22] Benjamin M Schwartz, Mike Bishop, and Erik Nygren,
"Service binding and parameter specification via the DNS
(DNS SVCB and HTTPS RRs)", 11 October 2022,
<https://datatracker.ietf.org/doc/draft-ietf-dnsop-svcb-
https/11/>.
[Sim11] Simpson, W., "TCP Cookie Transactions (TCPCT)", 2011,
<https://www.rfc-editor.org/rfc/rfc6013>.
Stebila, et al. Expires 8 May 2024 [Page 15]
Internet-Draft joseph-tls-turbotls November 2023
[SW19] Linjian Song and Shengling Wan, "ATR: Additional Truncated
Response for Large DNS Response", 10 September 2017,
<https://datatracker.ietf.org/doc/html/draft-song-atr-
large-resp-00>.
Authors' Addresses
Douglas Stebila
University of Waterloo
Email: dstebila@uwaterloo.ca
David Joseph
SandboxAQ
Email: dj@sandboxaq.com
Carlos Aguilar-Melchor
SandboxAQ
Email: carlos.aguilar@sandboxaq.com
Jason Goertzen
SandboxAQ
Email: jason.goertzen@sandboxquantum.com
Stebila, et al. Expires 8 May 2024 [Page 16]
