| Internet-Draft | Babel RTT Extension | April 2024 |
| Jonglez & Chroboczek | Expires 23 October 2024 | [Page] |
This document defines an extension to the Babel routing protocol that measures the round-trip time (RTT) between routers and makes it possible to prefer lower latency links over higher latency ones.¶
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The Babel routing protocol [RFC8966] does not mandate a specific algorithm for computing metrics; existing implementations use a packet-loss based metric on wireless links and a simple hop-count metric on all other types of links. While this strategy works reasonably well in many networks, it fails to select reasonable routes in some topologies involving tunnels or VPNs.¶
+------------+
| A (Paris) +---------------+
+------------+ \
/ \
/ \
/ \
+------------+ +------------+
| B (Paris) | | C (Tokyo) |
+------------+ +------------+
\ /
\ /
\ /
+------------+ /
| D (Paris) +---------------+
+------------+
Consider for example the topology described in Figure 1, with three routers A, B and D located in Paris and a fourth router C located in Tokyo, connected through tunnels in a diamond topology. When routing traffic from A to D, it is obviously preferable to use the local route through B, as this is likely to provide better service quality and lower monetary cost than the distant route through C. However, the existing implementations of Babel consider both routes as having the same metric, and will therefore route the traffic through C in roughly half the cases.¶
In the first part of this document (Section 3), we specify an extension to the Babel routing protocol that produces a sequence of accurate measurements of the round-trip time (RTT) between two Babel neighbours. These measurements are not directly usable as an input to Babel's route selection procedure, since they tend to be noisy and to cause a negative feedback loop, which might give rise to frequent oscillations. In a second part (Section 4), we define an algorithm that maps the sequence of RTT samples to a link cost that can be used for route selection.¶
The extension defined in Section 3 provides a sequence of accurate but potentially noisy RTT samples. Since the round-trip time is a symmetric measure of delay, this protocol is only applicable in environments where the symmetric delay is a good predictor of whether a link should be taken by routing traffic, which might not necessarily be the case in networks built over exotic link technologies.¶
The extension makes minimal requirements on the nodes. In particular, it does not assume synchronised clocks, but only requires that clock drift be negligible during the time interval between two Hello TLVs. Since that is on the order of a few seconds, this requirement is met even with cheap crystal oscillators such as the ones used in consumer electronics.¶
The algorithm defined in Section 4 makes a number of assumptions about the network. The assumption with most severe consequences is that all links below a certain RTT (rtt-min in Section 4.2) can be grouped in a single category of "good" links. While this is the case in wide-area overlay networks, it makes the algorithm inapplicable in networks where distinguishing between low-latency links is important.¶
There are other assumptions, but they are less likely to limit the algorithm's applicability. The algorithm assumes that all links above a certain RTT (rtt-max in Section 4.2) can be assumed to be equally bad, and will only be used as a last resort. In addition, in order to avoid oscillations, the algorithm is designed to react slowly to RTT variations, thus causing suboptimal routing for seconds or even minutes after an RTT change; while this is a desirable property in fixed networks, as it avoid excessive route oscillations, it might be an issue with networks with high rates of node mobility.¶
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 [RFC2119] [RFC8174] when, and only when, they appear in all capitals, as shown here.¶
We assume that every Babel speaker maintains a local clock, that counts microseconds from an arbitrary origin. We do not assume that clocks are synchronised: clocks local to distinct nodes need not share a common origin. The protocol will eventually recover if the clock is stepped, so clocks need not persist across node reboots.¶
Every Babel speaker maintains a Neighbour Table, described in Section 3.2.4 of [RFC8966]. This extension extends every entry in the Neighbour Table with the following data:¶
Both values are initially undefined.¶
The RTT to a neighbour is estimated using an algorithm due to Mills [MILLS], originally developed for the HELLO routing protocol and later used in NTP [NTP].¶
A Babel speaker periodically sends Hello messages to its neighbours (Section 3.4.1 of [RFC8966]). Additionally, it occasionally sends a set of IHU ("I Heard You") messages, at most one per neighbour (Section 3.4.2 of [RFC8966]).¶
A B
| |
t1 + |
|\ |
| \ |
| \ | Hello(t1)
| \ |
| \ |
| \|
| + t1'
| |
| | RTT = (t2 - t1) - (t2' - t1')
| |
| + t2'
| /|
| / |
| / |
| / | Hello(t2')
| / | IHU(t1, t1')
|/ |
t2 + |
| |
v v
In order to enable the computation of RTTs, a node A MUST include in every Hello that it sends a timestamp t1 (according to A's local clock), as illustrated in Figure 2. When a node B receives A's timestamped Hello, it computes the time t1' at which the Hello was received (according to B's local clock). It then MUST record the value t1 in the Origin Timestamp field of the Neighbour Table entry corresponding to A, and the value t1' in the Receive Timestamp field of the Neighbour Table entry.¶
When B sends an IHU to A, it checks whether both timestamps are defined in the Neighbour Table. If that is the case, then it MUST ensure that its IHU TLV is sent in a packet that also contains a timestamped Hello TLV (either a normally scheduled Hello, or an unscheduled Hello, see Section 3.4.1 of [RFC8966]). It MUST include in the IHU both the Origin Timestamp and the Receive Timestamp stored in the Neighbour Table.¶
Upon receiving B's packet, A computes the time t2 (according to its local clock) at which it was received. A MUST then verify that it contains both a Hello TLV with timestamp t2' and an IHU TLV with two timestamps t1 and t1'. If that is the case, A computes the value RTT = (t2 - t1) - (t2' - t1') (where all computations are done modulo 2^32), which is a measurement of the RTT between A and B. (A then stores the values t2' and t2 in its Neighbour Table, as B did before.)¶
This algorithm has a number of desirable properties. First, the algorithm is symmetric: A and B use the same procedures for timestamping packets and computing RTT samples, and both nodes produce one RTT sample for each received (Hello, IHU) pair. Second, since there is no requirement that t1' and t2' be equal, the protocol is asynchronous: the only change to Babel's message scheduling is the requirement that a packet containing an IHU also contain a Hello. Third, since it only ever computes differences of timestamps according to a single clock, it does not require synchronised clocks. Fourth, it requires very little additional state: a node only needs to store the two timestamps associated with the last hello received from each neighbour. Finally, since it only requires piggybacking one or two timestamps on each Hello and IHU TLV, it makes efficient use of network resources.¶
In principle, this algorithm is inaccurate in the presence of clock drift (i.e., when A's and B's clocks are running at different frequencies). However, t2' - t1' is usually on the order of a few seconds, and significant clock drift is unlikely to happen at that time scale.¶
In order for RTT values to be consistent between implementations, timestamps need to be computed at roughly the same point in the network stack. Transmit timestamps SHOULD be computed just before the packet is passed to the network stack (i.e., before it is subjected to any queueing delays), and receive timestamps SHOULD be computed just after the packet is received from the network stack.¶
Timestamp values are a count of microseconds stored as a 32-bit unsigned integer; thus, they wrap around every 71 minutes or so. What is more, a node may occasionally reboot and restart its clock at an arbitrary origin. For these reasons, very old timestamps or nonsensical timestamps MUST NOT be used to yield RTT samples.¶
The following algorithm can be used to achieve that. When a node receives a packet containing a Hello and an IHU, it compares the current local time t2 with the Origin Timestamp contained in the IHU; if the Origin Timestamp appears to be in the future, or if it is in the past by more than a time T (the value T = 3 minutes is recommended), then the timestamps are still recorded in the neighbour table, but are not used for computation of an RTT sample.¶
Similary, the node compares the Hello's timestamp with the Receive Timestamp recorded in the Neighbour Table; if the Hello's timestamp appears to be older than the recorded timestamp, or if it appears to be more recent by an interval larger than the value T, then the timestamps are not used for computation of an RTT sample.¶
The accuracy of the computed RTT samples depends on Transmit Timestamps being computed as late as possible before a packet containing a Hello TLV is passed to the network stack, and Receive Timestamps being computed as early as possible after reception of a packet containing a (Hello, IHU) pair. We have found the following implementation strategy to be useful.¶
When a Hello TLV is buffered for transmission, we insert a PadN sub-TLV (Section 4.7.2 of [RFC8966]) with a length of 4 octets within the TLV. When the packet is ready to be sent, we check whether it contains a 4-octet PadN sub-TLV; if that's the case, we overwrite the PadN sub-TLV with a Timestamp sub-TLV with the current time, and send out the packet.¶
Conversely, when a packet is received, we immediately compute the current time and record it with the received packet. We then process the packet as usual, and use the recorded timestamp in order to compute an RTT sample.¶
The protocol is designed to survive the clock being reset when a node reboots; on POSIX systems, this makes it possible to use the CLOCK_MONOTONIC clock for computing timestamps. If CLOCK_MONOTONIC is not available, CLOCK_REALTIME may be used, since the protocol is able to survive the clock being occasionally stepped.¶
The protocol described above yields a series of RTT samples. While these samples are fairly accurate, they are not directly usable as an input to the route selection procedure, for at least three reasons.¶
First of all, in the presence of bursty traffic, routers experience transient congestion, which causes occasional spikes in the measured RTT. Thus, the RTT signal may be noisy, and requires smoothing before it can be used for route selection.¶
Second, using the RTT signal for route selection gives rise to a negative feedback loop: when a route has a low RTT, it is deemed to be more desirable, which causes it to be used for more data traffic, which may lead to congestion, which in turn increases the RTT. Without some form of hysteresis, using RTT for route selection would lead to oscillations between parallel routes, which would lead to packet reordering and negatively affect upper-layer protocols (such as TCP).¶
Third, even in the absence of congestion, the RTT tends to exhibit some variation. If the RTTs of two parallel routes oscillate around a common value, using the RTT as input to route selection will cause frequent routing oscillations, which, again, indicates the need for some form of hysteresis.¶
In this section, we describe an algorithm that integrates smoothing and hysteresis and has been shown to behave well both in simulation and experimentally over the Internet [DELAY-BASED], and is RECOMMENDED when RTT information is being used for route selection. The algorithm is structured as follows:¶
The RTT samples provided by Mills' algorithm are fairly accurate, but noisy: experiments indicate the occasional presence of individual samples that are much larger than the expected value. Thus, some form of smoothing SHOULD be applied in order to avoid instabilities due to occasional outliers.¶
An implementation MAY use the exponential average algorithm, which is simple to implement and appears to yield good results in practice [DELAY-BASED]. The algorithm is parameterised by a constant α, where 0 < α < 1, which controls the amount of smoothing being applied. Fr each neighbour, it maintains a smoothed value RTT which is initially undefined. When the first sample RTT0 is measured, the smoothed value is set to the value of RTT0. At each new sample RTTn, the smoothed value is set to a weighted average of the previous smoothed value and the new sample:¶
RTT := α RTT + (1 - α) RTTn¶
The smoothing constant α SHOULD be between 0.8 and 0.9; the value 0.836 is the RECOMMENDED default.¶
The smoothed RTT value obtained in the previous step needs to be mapped to a link cost, suitable for input to the metric computation procedure (Section 3.5.2 of [RFC8966]). Obviously, the mapping should be monotonic (larger RTTs imply larger costs). In addition, the mapping should be constant beyond a certain value (all very bad links are equally bad), so that congested links do not contribute to routing instability. The mapping should also be constant around 0, so that small oscillations in the RTT of low-RTT links do not contribute to routing instability.¶
cost
^
|
|
| C + max-rtt-penalty
| +---------------------------
| /.
| / .
| / .
| / .
| / .
| / .
| / .
| / .
| / .
| / .
C +------------+ .
| . .
| . .
| . .
| . .
0 +---------------------------------------------------->
0 rtt-min rtt-max RTT
Implementations SHOULD use the mapping described in figure Figure 3, which is parameterised by three parameters rtt-min, rtt-max, and max-rtt-penalty. For RTT values below rtt-min, the link cost is just the nominal cost C of a single hop. Between rtt-min and rtt-max, the cost increases linearly; above rtt-max, the constant value max-rtt-penalty is added to the nominal cost.¶
The value rtt-min should be slightly larger than the RTT of a local, uncongested link. The value rtt-max should be the RTT above which a link should be avoided if possible, either because it is a long-distance link or because it is congested; reducing the value of rtt-max improves stability, but prevents the protocol from discriminating between high-latency links. As to max-rtt-penalty, it controls how much the protocol will penalise long-distance links. The default values rtt-min = 10ms, rtt-max = 120ms, and max-rtt-penalty = 150 are RECOMMENDED.¶
Even after applying a bounded mapping from smoothed RTT to a cost value, the cost may fluctuate when a link's RTT is between rtt-min and rtt-max. Implementations SHOULD use a robust hysteresis algorithm, such as the one described in Appendix A.3 of [RFC8966].¶
This protocol extension stores the data that it requires within sub-TLVs of Babel's Hello and IHU TLVs. As discussed in Appendix D of [RFC8966], implementations that do not understand this extension will silently ignore the sub-TLVs while parsing the rest of the TLVs that they contain. In effect, this extension supports building hybrid networks consisting of extended and unextended routers, and while such networks might suffer from sub-optimal routing, they will not suffer from blackholes or routing loops.¶
If a sub-TLV defined in this extension is longer than expected, the additional data is silently ignored. This provision is made in order to allow a future version of this protocol to extend the packet format with additional data, for example high-precision or absolute timestamps.¶
This extension defines the Timestamp sub-TLV whose Type field has value 3. This sub-TLV can be contained within a Hello sub-TLV, in which case it carries a single timestamp, or within an IHU sub-TLV, in which case it carries two timestamps.¶
Timestamps are encoded as 32-bit unsigned integers (modulo 2^32), expressed in units of one microsecond, counting from an arbitrary origin. Timestamps wrap around every 4295 seconds, or rougly 71 minutes (see also Section 3.3).¶
When contained within a Hello TLV, the Timestamp sub-TLV has the following format:¶
0 1 2 3 0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5 6 7 8 9 0 1 +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+ | Type = 3 | Length | Transmit timestamp | +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+ | (continued) | +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+¶
Fields:¶
If the Length field is larger than the expected 4 octets, the sub-TLV MUST be processed normally (the first 4 octets are interpreted as described above), and any extra data contained in this sub-TLV MUST be silently ignored. If the Length field is smaller than the expected 4 octets, then this sub-TLV MUST be ignored (and the remainder of the enclosing TLV processed as usual).¶
When contained in an IHU TLV, the Timestamp sub-TLV has the following format:¶
0 1 2 3 0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5 6 7 8 9 0 1 2 3 4 5 6 7 8 9 0 1 +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+ | Type = 3 | Length | Origin timestamp | +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+ | (continued) | Receive timestamp | +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+ | (continued) | +-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+-+¶
Fields:¶
If the Length field is larger than the expected 8 octets, the sub-TLV MUST be processed normally (the first 8 octets are interpreted as described above), and any extra data contained in this sub-TLV MUST be silently ignored. If the Length field is smaller than the expected 8 octets, then this sub-TLV MUST be ignored (and the remainder of the enclosing TLV processed as usual).¶
IANA has added the following entry to the "Babel Sub-TLV Types" registry:¶
| Type | Name | Reference |
|---|---|---|
| 3 | Timestamp | (this document) |
This extension adds additional timestamping data to two of the TLVs sent by a Babel router. By broadcasting the value of a reasonably accurate local clock, they might make a node more susceptible to timing attacks.¶
Broadcasting an accurate time raises privacy issues. The timestamps used by this protocol have an arbitrary origin, and therefore do not leak a node's boot time or timezone. However, having access to accurate timestamps could allow an attacker to determine the physical location of a node. Nodes might avoid disclosure of location information by not including timestamp sub-TLVs in the TLVs that they send, which will cause their neighbours to fall back to hop-count routing.¶
The authors are indebted to Jean-Paul Smets, who prompted the investigation that originally lead to this protocol. We are also grateful to Donald Eastlake, Toke Høiland-Jørgensen, Maria Matejka, David Schinazi, Pacal Thubert, Steffen Vogel, and Ondřej Zajiček.¶