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Internet Engineering Task Force (IETF) N. Rozen-Schiff
Request for Comments: 9523 D. Dolev
Category: Informational Hebrew University of Jerusalem
ISSN: 2070-1721 T. Mizrahi
Huawei Network.IO Innovation Lab
M. Schapira
Hebrew University of Jerusalem
February 2024
A Secure Selection and Filtering Mechanism for the Network Time Protocol
with Khronos
Abstract
The Network Time Protocol version 4 (NTPv4), as defined in RFC 5905,
is the mechanism used by NTP clients to synchronize with NTP servers
across the Internet. This document describes a companion application
to the NTPv4 client, named "Khronos", that is used as a "watchdog"
alongside NTPv4 and that provides improved security against time-
shifting attacks. Khronos involves changes to the NTP client's
system process only. Since it does not affect the wire protocol, the
Khronos mechanism is applicable to current and future time protocols.
Status of This Memo
This document is not an Internet Standards Track specification; it is
published for informational purposes.
This document is a product of the Internet Engineering Task Force
(IETF). It represents the consensus of the IETF community. It has
received public review and has been approved for publication by the
Internet Engineering Steering Group (IESG). Not all documents
approved by the IESG are candidates for any level of Internet
Standard; see Section 2 of RFC 7841.
Information about the current status of this document, any errata,
and how to provide feedback on it may be obtained at
https://www.rfc-editor.org/info/rfc9523.
Copyright Notice
Copyright (c) 2024 IETF Trust and the persons identified as the
document authors. All rights reserved.
This document is subject to BCP 78 and the IETF Trust's Legal
Provisions Relating to IETF Documents
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to this document. Code Components extracted from this document must
include Revised BSD License text as described in Section 4.e of the
Trust Legal Provisions and are provided without warranty as described
in the Revised BSD License.
Table of Contents
1. Introduction
2. Conventions Used in This Document
2.1. Terms and Abbreviations
2.2. Notations
3. Khronos Design
3.1. Khronos Calibration - Gathering the Khronos Pool
3.2. Khronos's Poll and System Processes
3.3. Khronos's Recommended Parameters
4. Operational Considerations
4.1. Load Considerations
5. Security Considerations
5.1. Threat Model
5.2. Attack Detection
5.3. Security Analysis Overview
6. Khronos Pseudocode
7. Precision vs. Security
8. IANA Considerations
9. References
9.1. Normative References
9.2. Informative References
Acknowledgements
Authors' Addresses
1. Introduction
NTPv4, as defined in [RFC5905], is vulnerable to time-shifting
attacks in which the attacker changes (shifts) the clock of a network
device. Time-shifting attacks on NTP clients can be based on
interfering with the communication between the NTP clients and
servers or compromising the servers themselves. Time-shifting
attacks on NTP are possible even if NTP communication is encrypted
and authenticated. A weaker machine-in-the-middle (MITM) attacker
can shift time simply by dropping or delaying packets, whereas a
powerful attacker that has full control over an NTP server can do so
by explicitly determining the NTP response content. This document
introduces a time-shifting mitigation mechanism called "Khronos".
Khronos can be integrated as a background-monitoring application
(watchdog) that guards against time-shifting attacks in any NTP
client. An NTP client that runs Khronos is interoperable with NTPv4
servers that are compatible with [RFC5905]. The Khronos mechanism
does not affect the wire mechanism; therefore, it is applicable to
any current or future time protocol.
Khronos is a mechanism that runs in the background, continuously
monitoring the client clock (which is updated by NTPv4) and
calculating an estimated offset (referred to as the "Khronos time
offset"). When the offset exceeds a predefined threshold (specified
in Section 5.2), this is interpreted as the client experiencing a
time-shifting attack. In this case, Khronos updates the client's
clock.
When the client is not under attack, Khronos is passive. This allows
NTPv4 to control the client's clock and provides the ordinary high
precision and accuracy of NTPv4. When under attack, Khronos takes
control of the client's clock, mitigating the time shift while
guaranteeing relatively high accuracy with respect to UTC and
precision, as discussed in Section 7.
By leveraging techniques from distributed computing theory for time
synchronization, Khronos achieves accurate time even in the presence
of powerful attackers who are in direct control of a large number of
NTP servers. Khronos will prevent shifting the clock when the ratio
of compromised time samples is below 2/3. In each polling interval,
a Khronos client randomly selects and samples a few NTP servers out
of a local pool of hundreds of servers. Khronos is carefully
engineered to minimize the load on NTP servers and the communication
overhead. In contrast, NTPv4 employs an algorithm that typically
relies on a small subset of the NTP server pool (e.g., four servers)
for time synchronization and is much more vulnerable to time-shifting
attacks. Configuring NTPv4 to use several hundreds of servers will
increase its security, but will incur very high network and
computational overhead compared to Khronos and will be bounded by a
compromised ratio of half of the time samples.
A Khronos client iteratively "crowdsources" time queries across NTP
servers and applies a provably secure algorithm for eliminating
"suspicious" responses and for averaging over the remaining
responses. In each Khronos poll interval, the Khronos client
selects, uniformly at random, a small subset (e.g., 10-15 servers) of
a large server pool (containing hundreds of servers). While Khronos
queries around three times more servers per polling interval than
NTP, Khronos's polling interval can be longer (e.g., 10 times longer)
than NTPv4, thereby minimizing the load on NTP servers and the
communication overhead. Moreover, Khronos's random server selection
may even help to distribute queries across the whole pool.
Khronos's security was evaluated both theoretically and
experimentally with a prototype implementation. According to this
security analysis, if a local Khronos pool consists of, for example,
500 servers, one-seventh of whom are controlled by an attacker and
Khronos queries 15 servers in each Khronos poll interval (around 10
times the NTPv4 poll interval), then over 20 years of effort are
required (in expectation) to successfully shift time at a Khronos
client by over 100 ms from UTC. The full exposition of the formal
analysis of this guarantee is available at [Khronos].
Khronos maintains a time offset value (the Khronos time offset) and
uses it as a reference for detecting attacks. This time offset value
computation differs from the current NTPv4 in two key aspects:
* First, in each Khronos poll interval, Khronos periodically
communicates with only a few (tens) randomly selected servers out
of a pool consisting of a large number (e.g., hundreds) of NTP
servers.
* Second, Khronos computes the Khronos time offset based on an
approximate agreement technique to remove outliers, thus limiting
the attacker's ability to contaminate the time samples (offsets)
derived from the queried NTP servers.
These two aspects allow Khronos to minimize the load on the NTP
servers and to provide provable security guarantees against both MITM
attackers and attackers capable of compromising a large number of NTP
servers.
We note that, to some extent, Network Time Security (NTS) [RFC8915]
could make it more challenging for attackers to perform MITM attacks,
but is of little impact if the servers themselves are compromised.
2. Conventions Used in This Document
2.1. Terms and Abbreviations
NTPv4: Network Time Protocol version 4. See [RFC5905].
System process: See the "Selection Algorithm" and the "Cluster
Algorithm" sections of [RFC5905].
Security Requirements: See "Security Requirements of Time Protocols
in Packet Switched Networks" [RFC7384].
NTS: Network Time Security. See "Network Time Security for the
Network Time Protocol" [RFC8915].
2.2. Notations
When describing the Khronos algorithm, the following notation is
used:
+==========+====================================================+
| Notation | Meaning |
+==========+====================================================+
| n | The number of candidate servers in a Khronos pool |
| | (potentially hundreds). |
+----------+----------------------------------------------------+
| m | The number of servers that Khronos queries in each |
| | poll interval (up to tens). |
+----------+----------------------------------------------------+
| w | An upper bound on the distance between any |
| | "truechimer" NTP server (as in [RFC5905]) and UTC. |
+----------+----------------------------------------------------+
| B | An upper bound on the client's clock error rate |
| | (ms/sec). |
+----------+----------------------------------------------------+
| ERR | An upper bound on the client's clock error between |
| | Khronos polls (ms). |
+----------+----------------------------------------------------+
| K | The number of Khronos pool resamplings until |
| | reaching "panic mode". |
+----------+----------------------------------------------------+
| H | Predefined threshold for a Khronos time offset |
| | triggering clock update by Khronos. |
+----------+----------------------------------------------------+
Table 1: Khronos Notation
The recommended values are discussed in Section 3.3.
3. Khronos Design
Khronos periodically queries a set of m (tens) servers from a large
(hundreds) server pool in each Khronos poll interval, where the m
servers are selected from the server pool at random. Based on
empirical analyses, to minimize the load on NTP servers while
providing high security, the Khronos poll interval should be around
10 times the NTPv4 poll interval (i.e., a Khronos clock update occurs
once every 10 NTPv4 clock updates). In each Khronos poll interval,
if the Khronos time offset exceeds a predetermined threshold (denoted
as H), an attack is indicated.
Unless an attack is indicated, Khronos uses only one sample from each
server (avoiding the "Clock Filter Algorithm" as defined in
Section 10 of [RFC5905]). When under attack, Khronos uses several
samples from each server and executes the "Clock Filter Algorithm"
for choosing the best sample from each server with low jitter. Then,
given a sample from each server, Khronos discards outliers by
executing the procedure described in Section 3.2.
Between consecutive Khronos polls, Khronos keeps track of clock
offsets, e.g., by catching clock discipline (as in [RFC5905]) calls.
The sum of offsets is referred to as the "Khronos inter-poll offset"
(denoted as tk), which is set to zero after each Khronos poll.
3.1. Khronos Calibration - Gathering the Khronos Pool
Calibration is performed the first time Khronos is executed and
periodically thereafter (once every two weeks). The calibration
process generates a local Khronos pool of n (up to hundreds) NTP
servers that the client can synchronize with. To this end, Khronos
makes multiple DNS queries to the NTP pools. Each query returns a
few NTP server IPs that Khronos combines into one set of IPs
considered as the Khronos pool. The servers in the Khronos pool
should be scattered across different regions to make it harder for an
attacker to compromise or gain MITM capabilities with respect to a
large fraction of the Khronos pool. Therefore, Khronos calibration
queries general NTP server pools (e.g., pool.ntp.org) and not just
the pool in the client's state or region. In addition, servers can
be selected to be part of the Khronos pool manually or by using other
NTP pools (such as NIST Internet time servers).
The first Khronos update requires m servers, which can be found in
several minutes. Moreover, it is possible to query several DNS pool
names to vastly accelerate the calibration and the first update.
The calibration is the only Khronos part where DNS traffic is
generated. Around 125 DNS queries are required by Khronos to obtain
addresses of 500 NTP servers, which is higher than Khronos pool size
(n). Assuming the calibration period is two weeks, the expected DNS
traffic generated by the Khronos client is less than 10 DNS queries
per day, which is usually several orders of magnitude lower than the
total daily number of DNS queries per machine.
3.2. Khronos's Poll and System Processes
In each Khronos poll interval, the Khronos system process randomly
chooses a set of m (tens) servers out of the Khronos pool of n
(hundreds) servers and samples them. Note that the randomness of the
server selection is crucial for the security of the scheme;
therefore, any Khronos implementation must use a secure randomness
implementation such as what is used for encryption key generation.
Khronos's polling times of different servers may spread uniformly
within its poll interval, which is similar to NTPv4. Servers that do
not respond during the Khronos poll interval are filtered out. If
less than one-third of the m servers are left, a new subset of
servers is immediately sampled in the exact same manner (which is
called the "resampling" process).
Next, out of the time samples received from this chosen subset of
servers, the lowest third of the samples' offset values and the
highest third of the samples' offset values are discarded.
Khronos checks that the following two conditions hold for the
remaining sampled offsets (considering w and ERR defined in Table 1):
* The maximal distance between every two offsets does not exceed 2w
(can be verified by considering just the minimum and the maximum
offsets).
* The distance between the offset's average and the Khronos inter-
poll offset is ERR+2w at most.
In the event that both of these conditions are satisfied, the average
of the offsets is set to be the Khronos time offset. Otherwise,
resampling is performed. This process spreads the Khronos client's
queries across servers, thereby improving security against powerful
attackers (as discussed in Section 5.3) and mitigating the effect of
a DoS attack on NTP servers that renders them non-responsive. This
resampling process continues in subsequent Khronos poll intervals
until the two conditions are both satisfied or the number of times
the servers are resampled exceeds a "panic trigger" (K in Table 1).
In this case, Khronos enters panic mode.
In panic mode, Khronos queries all the servers in its local Khronos
pool, orders the collected time samples from lowest to highest, and
eliminates the lowest third and the highest third of the samples.
The client then calculates the average of the remaining samples and
sets this average to be the new Khronos time offset.
If the Khronos time offset exceeds a predetermined threshold (H), it
is passed on to the clock discipline algorithm in order to steer the
system time (as in [RFC5905]). In this case, the user and/or admin
of the client machine should be notified about the detected time-
shifting attack, e.g., by a message written to a relevant event log
or displayed on screen.
Note that resampling immediately follows the previous sampling since
waiting until the next polling interval may increase the time shift
in face of an attack. This shouldn't generate high overhead since
the number of resamples is bounded by K (after K resamplings, panic
mode is in place) and the chances of ending up with repeated
resampling are low (see Section 5 for more details). Moreover, in an
interval following a panic mode, Khronos executes the same system
process that starts by querying only m servers (regardless of
previous panic).
3.3. Khronos's Recommended Parameters
According to empirical observations (presented in [Khronos]),
querying 15 servers at each poll interval (i.e., m=15) out of 500
servers (i.e., n=500) and setting w to be around 25 ms provides both
high time accuracy and good security. Specifically, when selecting
w=25 ms, approximately 83% of the servers' clocks are, at most, w
away from UTC and within 2w from each other, satisfying the first
condition of Khronos's system process. For a similar reason, the
threshold for a Khronos time offset triggering a clock update by
Khronos (H) should be between w and 2w; the default is 30 ms. Note
that in order to support scenarios with congested links, using a
higher w value, such as 1 second, is recommended.
Furthermore, according to Khronos security analysis, setting K to be
3 (i.e., if the two conditions are not satisfied after three
resamplings, then Khronos enters panic mode) is safe when facing
time-shifting attacks. In addition, the probability of an attacker
forcing a panic mode on a client when K=3 is negligible (less than
0.000002 for each polling interval).
Khronos's effect on precision and accuracy are discussed in Sections
5 and 7.
4. Operational Considerations
Khronos is designed to defend NTP clients from time-shifting attacks
while using public NTP servers. As such, Khronos is not applicable
for data centers and enterprises that synchronize with local atomic
clocks, GPS devices, or a dedicated NTP server (e.g., due to
regulations).
Khronos can be used for devices that require and depend upon
timekeeping within a configurable constant distance from UTC.
4.1. Load Considerations
One requirement from Khronos is not to induce excessive load on NTP
servers beyond that of NTPv4, even if it is widely integrated into
NTP clients. We discuss below the possible causes for a Khronos-
induced load on servers and how this can be mitigated.
Servers in pool.ntp.org are weighted differently by the NTP server
pool when assigned to NTP clients. Specifically, server owners
define a "server weight" (the "netspeed" parameter) and servers are
assigned to clients probabilistically according to their proportional
weight. Khronos's queries are equally distributed across a pool of
servers. To avoid overloading servers, Khronos queries servers less
frequently than NTPv4, with the Khronos query interval set to 10
times the default NTPv4 maxpoll (interval) parameter. Hence, if
Khronos queries are targeted at servers in pool.ntp.org, any target
increase in server load (in terms of multiplicative increase in
queries or number of bytes per second) is controlled by the poll
interval configuration, which was analyzed in [Ananke].
Consider the scenario where an attacker attempts to generate
significant load on NTP servers by triggering multiple consecutive
panic modes at multiple NTP clients. We note that to accomplish
this, the attacker must have MITM capabilities with respect to the
communication between each and every client in a large group of
clients and a large fraction of all NTP servers in the queried pool.
This implies that the attacker must either be physically located at a
central location (e.g., at the egress of a large ISP) or launch a
wide-scale attack (e.g., on BGP or DNS); thereby, it is capable of
carrying similar and even higher impact attacks regardless of Khronos
clients.
5. Security Considerations
5.1. Threat Model
The threat model encompasses a broad spectrum of attackers impacting
a subset (e.g., one-third) of the servers in NTP pools. These
attackers can range from a fairly weak (yet dangerous) MITM attacker
that is only capable of delaying and dropping packets (e.g., using
the Bufferbloat attack [RFC8033]) to an extremely powerful attacker
who is in control of (even authenticated) NTP servers and is capable
of fully determining the values of the time samples returned by these
NTP servers (see detailed attacker discussion in [RFC7384]).
For example, the attackers covered by this model might be:
1. in direct control of a fraction of the NTP servers (e.g., by
exploiting a software vulnerability),
2. an ISP (or other attacker at the Autonomous System level) on the
default BGP paths from the NTP client to a fraction of the
available servers,
3. a nation state with authority over the owners of NTP servers in
its jurisdiction, or
4. an attacker capable of hijacking (e.g., through DNS cache
poisoning or BGP prefix hijacking) traffic to some of the
available NTP servers.
The details of the specific attack scenario are abstracted by
reasoning about attackers in terms of the fraction of servers with
respect to which the attacker has adversarial capabilities.
Attackers that can impact communications with (or control) a higher
fraction of the servers (e.g., all servers) are out of scope.
Considering the pool size across the world to be in the thousands,
such attackers will most likely be capable of creating far worse
damage than time-shifting attacks.
Notably, Khronos provides protection from MITM and powerful attacks
that cannot be achieved by cryptographic authentication protocols
since, even with such measures in place, an attacker can still
influence time by dropping/delaying packets. However, adding an
authentication layer (e.g., NTS [RFC8915]) to Khronos will enhance
its security guarantees and enable the detection of various spoofing
and modification attacks.
Moreover, Khronos uses randomness to independently select the queried
servers in each poll interval, preventing attackers from exploiting
observations of past server selections.
5.2. Attack Detection
Khronos detects time-shifting attacks by constantly monitoring
NTPv4's (or potentially any other current or future time protocol)
clock and the offset computed by Khronos and checking whether the
offset exceeds a predetermined threshold (H). NTPv4 controls the
client's clock unless an attack was detected. Under attack, Khronos
takes control over the client's clock in order to prevent its shift.
Analytical results (in [Khronos]) indicate that if a local Khronos
pool consists of 500 servers, one-seventh of whom are controlled by a
MITM attacker, and 15 of those servers are queried in each Khronos
poll interval, then success in shifting time of a Khronos client by
even a small degree (100 ms) takes many years of effort (over 20
years in expectation). See a brief overview of Khronos's security
analysis below.
5.3. Security Analysis Overview
Time samples that are at most w away from UTC are considered "good",
whereas other samples are considered "malicious". Two scenarios are
considered:
* Scenario A: Less than two-thirds of the queried servers are under
the attacker's control.
* Scenario B: The attacker controls more than two-thirds of the
queried servers.
Scenario A consists of two sub-cases:
1. There is at least one good sample in the set of samples not
eliminated by Khronos (in the middle third of samples), and
2. there are no good samples in the remaining set of samples.
In sub-case 1, the other remaining samples, including those provided
by the attacker, must be close to a good sample (otherwise, the first
condition of Khronos's system process in Section 3.2 is violated and
a new set of servers is chosen). This implies that the average of
the remaining samples must be close to UTC.
In sub-case 2, since more than a third of the initial samples were
good, both the (discarded) third-lowest-value samples and the
(discarded) third-highest-value samples must each contain a good
sample. Hence, all the remaining samples are bounded from both above
and below by good samples, and so is their average value, implying
that this value is close to UTC [RFC5905].
In Scenario B, the worst possibility for the client is that all
remaining samples are malicious (i.e., more than w away from UTC).
However, as proved in [Khronos], the probability of this scenario is
extremely low, even if the attacker controls a large fraction (e.g.,
one-fourth) of the n servers in the local Khronos pool. Therefore,
the probability that the attacker repeatedly reaches this scenario
decreases exponentially, rendering the probability of a significant
time shift negligible. We can express the improvement ratio of
Khronos over NTPv4 by the ratios of their single-shift probabilities.
Such ratios are provided in Table 2, where higher values indicate
higher improvement of Khronos over NTPv4 and are also proportional to
the expected time until a time-shift attack succeeds once.
+========+==========+==========+==========+==========+==========+
| Attack | 6 | 12 | 18 | 24 | 30 |
| Ratio | Samples | Samples | Samples | Samples | Samples |
+========+==========+==========+==========+==========+==========+
| 1/3 | 1.93e+01 | 3.85e+02 | 7.66e+03 | 1.52e+05 | 3.03e+06 |
+--------+----------+----------+----------+----------+----------+
| 1/5 | 1.25e+01 | 1.59e+02 | 2.01e+03 | 2.54e+04 | 3.22e+05 |
+--------+----------+----------+----------+----------+----------+
| 1/7 | 1.13e+01 | 1.29e+02 | 1.47e+03 | 1.67e+04 | 1.90e+05 |
+--------+----------+----------+----------+----------+----------+
| 1/9 | 8.54e+00 | 7.32e+01 | 6.25e+02 | 5.32e+03 | 4.52e+04 |
+--------+----------+----------+----------+----------+----------+
| 1/10 | 5.83e+00 | 3.34e+01 | 1.89e+02 | 1.07e+03 | 6.04e+03 |
+--------+----------+----------+----------+----------+----------+
| 1/15 | 3.21e+00 | 9.57e+00 | 2.79e+01 | 8.05e+01 | 2.31e+02 |
+--------+----------+----------+----------+----------+----------+
Table 2: Khronos Improvement
In addition to evaluating the probability of an attacker successfully
shifting time at the client's clock, we also evaluated the
probability that the attacker succeeds in launching a DoS attack on
the servers by causing many clients to enter panic mode (and querying
all the servers in their local Khronos pools). This probability
(with the previous parameters of n=500, m=15, w=25, and K=3) is
negligible even for an attacker who controls a large number of
servers in clients' local Khronos pools, and it is expected to take
decades to force a panic mode.
Further details about Khronos's security guarantees can be found in
[Khronos].
6. Khronos Pseudocode
The pseudocode for Khronos Time Sampling Scheme, which is invoked in
each Khronos poll interval, is as follows:
counter = 0
S = []
T = []
While counter < K do
S = sample(m) //get samples from (tens of) randomly chosen servers
T = bi_side_trim(S,1/3) //trim lowest and highest thirds
if (max(T) - min(T) <= 2w) and (|avg(T) - tk| < ERR + 2w), then
return avg(T) // Normal case
end
counter ++
end
// panic mode
S = sample(n)
T = bi-sided-trim(S,1/3) //trim lowest and highest thirds
return avg(T)
Note that if clock disciplines can be called during this pseudocode's
execution, then each time offset sample, as well as the final output
(Khronos time offset), should be normalized with the sum of the clock
disciplines offsets (tk) at the time of computing it.
7. Precision vs. Security
Since NTPv4 updates the clock at times when no time-shifting attacks
are detected, the precision and accuracy of a Khronos client are the
same as NTPv4 at these times. Khronos is proved to maintain an
accurate estimation of the UTC with high probability. Therefore,
when Khronos detects that client's clock error exceeds a threshold
(H), it considers it to be an attack and takes control over the
client's clock. As a result, the time shift is mitigated and high
accuracy is guaranteed (the error is bounded by H).
Khronos is based on crowdsourcing across servers and regions, changes
the set of queried servers more frequently than NTPv4 [Khronos], and
avoids some of the filters in NTPv4's system process. These factors
can potentially harm its precision. Therefore, a smoothing mechanism
can be used where instead of a simple average of the remaining
samples, the smallest (in absolute value) offset is used unless its
distance from the average is higher than a predefined value.
Preliminary experiments demonstrated promising results with precision
similar to NTPv4.
In applications such as multi-source media streaming, which are
highly sensitive to time differences among hosts, note that it is
advisable to use Khronos at all hosts in order to obtain high
precision, even in the presence of attackers that try to shift each
host in a different magnitude and/or direction. Another approach
that is more efficient for these cases may be to allow direct time
synchronization between one host who runs Khronos to others.
8. IANA Considerations
This document has no IANA actions.
9. References
9.1. Normative References
[RFC5905] Mills, D., Martin, J., Ed., Burbank, J., and W. Kasch,
"Network Time Protocol Version 4: Protocol and Algorithms
Specification", RFC 5905, DOI 10.17487/RFC5905, June 2010,
<https://www.rfc-editor.org/info/rfc5905>.
[RFC7384] Mizrahi, T., "Security Requirements of Time Protocols in
Packet Switched Networks", RFC 7384, DOI 10.17487/RFC7384,
October 2014, <https://www.rfc-editor.org/info/rfc7384>.
[RFC8033] Pan, R., Natarajan, P., Baker, F., and G. White,
"Proportional Integral Controller Enhanced (PIE): A
Lightweight Control Scheme to Address the Bufferbloat
Problem", RFC 8033, DOI 10.17487/RFC8033, February 2017,
<https://www.rfc-editor.org/info/rfc8033>.
[RFC8915] Franke, D., Sibold, D., Teichel, K., Dansarie, M., and R.
Sundblad, "Network Time Security for the Network Time
Protocol", RFC 8915, DOI 10.17487/RFC8915, September 2020,
<https://www.rfc-editor.org/info/rfc8915>.
9.2. Informative References
[Ananke] Perry, Y., Rozen-Schiff, N., and M. Schapira, "A Devil of
a Time: How Vulnerable is NTP to Malicious Timeservers?",
Network and Distributed Systems Security (NDSS) Symposium,
Virtual, DOI 10.14722/ndss.2021.24302, February 2021,
<https://www.ndss-symposium.org/wp-content/uploads/
ndss2021_1A-2_24302_paper.pdf>.
[Khronos] Deutsch, O., Rozen-Schiff, N., Dolev, D., and M. Schapira,
"Preventing (Network) Time Travel with Chronos", Network
and Distributed Systems Security (NDSS) Symposium, San
Diego, CA, USA, DOI 10.14722/ndss.2018.23231, February
2018, <https://www.ndss-symposium.org/wp-
content/uploads/2018/02/ndss2018_02A-2_Deutsch_paper.pdf>.
Acknowledgements
The authors would like to thank Erik Kline, Miroslav Lichvar, Danny
Mayer, Karen O'Donoghue, Dieter Sibold, Yaakov (J) Stein, Harlan
Stenn, Hal Murray, Marcus Dansarie, Geoff Huston, Roni Even, Benjamin
Schwartz, Tommy Pauly, Rob Sayre, Dave Hart, and Ask Bjorn Hansen for
valuable contributions to this document and helpful discussions and
comments.
Authors' Addresses
Neta Rozen-Schiff
Hebrew University of Jerusalem
Jerusalem
Israel
Phone: +972 2 549 4599
Email: neta.r.schiff@gmail.com
Danny Dolev
Hebrew University of Jerusalem
Jerusalem
Israel
Phone: +972 2 549 4588
Email: danny.dolev@mail.huji.ac.il
Tal Mizrahi
Huawei Network.IO Innovation Lab
Israel
Email: tal.mizrahi.phd@gmail.com
Michael Schapira
Hebrew University of Jerusalem
Jerusalem
Israel
Phone: +972 2 549 4570
Email: schapiram@huji.ac.il