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**Georgia Institute of Technology**

Bandwidth estimation in computer networks: measurement techniques & applications Constantine Dovrolis College of Computing Georgia Institute of Technology

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**The Internet as a “black box”**

Several network properties are important for applications and transport protocols: Delay, loss rate, capacity, congestion, load, etc But routers and switches do not provide direct feedback to end-hosts (except ICMP, also of limited use) Mostly due to scalability, policy, and simplicity reasons

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**Can we guess what is in the black box?**

probe packets End-systems can infer network state through end-to-end (e2e) measurements Without any feedback from routers Objectives: accuracy, speed, non-intrusiveness

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**Bandwidth estimation in packet networks**

Bandwidth estimation (bwest) area: Inference of various throughput-related metrics with end-to-end network measurements Early works: Keshav’s packet pair method for congestion control (‘89) Bolot’s capacity measurements (’93) Carter-Crovella’s bprobe and cprobe tools (’96) Jacobson’s pathchar - per-hop capacity estimation (‘97) Melander’s TOPP method for avail-bw estimation (’00) In last 3-5 years: Several fundamentally new estimation techniques Many research papers at prestigious conferences More than a dozen of new measurement tools Several applications of bwest methods Significant commercial interest in bwest technology

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Overview This talk is an overview of the most important developments in bwest area over the last 10 years A personal bias could not be avoided.. Overview Bandwidth-related metrics Capacity estimation Packet pairs and CapProbe technique Available bandwidth estimation Iterative probing: Pathload, Pathvar and PathChirp Comparison of tools Applications SOcket Buffer Auto-Sizing (SOBAS)

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**Network bandwidth metrics**

Ravi S.Prasad, Marg Murray, K.C. Claffy, Constantine Dovrolis, “Bandwidth Estimation: Metrics, Measurement Techniques, and Tools,” IEEE Network, November/December 2003.

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**Capacity definition Maximum possible end-to-end throughput at IP layer**

In the absence of any cross traffic Achievable with maximum-sized packets If Ci is capacity of link i, end-to-end capacity C defined as: Capacity determined by narrow link

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**Available bandwidth definition**

Per-hop average avail-bw: Ai = Ci (1-ui) ui: average utilization A.k.a. residual capacity End-to-end avg avail-bw A: Determined by tight link ISPs measure per-hop avail-bw passively (router counters, MRTG graphs)

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**The avail-bw as a random process**

Instantaneous utilization ui(t): either 0 or 1 Link utilization in (t, t+t) Averaging timescale: t Available bandwidth in (t, t+t) End-to-end available bandwidth in (t, t+t) Point: what is por hop avail-bw?

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**Available bandwidth distribution**

Avail-bw has significant variability Need to estimate second-order moments, or even better, the avail-bw distribution Variability depends on averaging timescale t Larger timescale, lower variance Distribution is Gaussian-like, if t > msec and with sufficient flow multiplexing

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**E2E Capacity estimation (a’): Packet pair technique**

Constantine Dovrolis, Parmesh Ramanathan, David Moore, “Packet Dispersion Techniques and Capacity Estimation,” In IEEE/ACM Transactions on Networking, Dec 2004.

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**Packet pair dispersion**

Packet Pair (P-P) technique Originally, due to Jacobson & Keshav Send two equal-sized packets back-to-back Packet size: L Packet trx time at link i: L/Ci P-P dispersion: time interval between last bit of two packets Without any cross traffic, the dispersion at receiver is determined by narrow link:

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**Cross traffic interference**

Cross traffic packets can affect P-P dispersion P-P expansion: capacity underestimation P-P compression: capacity overestimation Noise in P-P distribution depends on cross traffic load Example: Internet path with 1Mbps capacity

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**Multimodal packet pair distribution**

Typically, P-P distribution includes several local modes One of these modes (not always the strongest) is located at L/C Sub-Capacity Dispersion Range (SCDR) modes: P-P expansion due to common cross traffic packet sizes (e.g., 40B, 1500B) Post-Narrow Capacity Modes (PNCMs): P-P compression at links that follow narrow link

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**E2E Capacity estimation (b’): CapProbe**

Rohit Kapoor, Ling-Jyh Chen, Li Lao, Mario Gerla, M. Y. Sanadidi, "CapProbe: A Simple and Accurate Capacity Estimation Technique," ACM SIGCOMM 2004

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**Compression of p-p dispersion**

First packet queueing => compressed dispersion Capacity overestimation

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**Expansion of p-p dispersion**

Second packet queueing => expansion of dispersion Capacity underestimation

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CapProbe Both expansion and compression are result queuing delays Key insight: packet pair that sees zero queueing delay would yield exact estimate measure RTT for each probing packet of packet pair estimate capacity from pair with minimum RTT-sum Capacity

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**Measurements - Internet, Internet2**

CapProbe implemented using PING packets, sent in pairs To UCLA-2 UCLA-3 UA NTNU Time Capacity Cap Probe 0’03 5.5 0’01 96 0’02 98 0’07 97 5.6 0’04 79 0’17 83 0’22 Pathrate 6’10 0’16 5’19 86 0’29 6’14 5.4 5’20 88 0’25 6’5 5.7 5’18 133 Pathchar 21’12 4.0 22’49 18 3 hr 34 20’43 3.9 27’41 35 21.18 29’47 30

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**Avail-bw estimation (a’): Pathload**

Manish Jain, Constantine Dovrolis, “End-to-End Available Bandwidth: Measurement Methodology, Dynamics, and Relation with TCP Throughput,” IEEE/ACM Transactions on Networking, Aug 2003.

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Probing methodology Sender transmits periodic packet stream of rate R K packets, packet size L, interarrival T = L/R Receiver measures One-Way Delay (OWD) for each packet D(k) = tarv(k) - tsnd(k) OWD variations: Δ(k) = D(k+1) – D(k) Independent of clock offset between sender/receiver With stationary & fluid-modeled cross traffic: If R > A, then Δ(k) > 0 for all k Else, Δ(k) = 0 for all k

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**Self-loading periodic streams**

Increasing OWDs means R>A Almost constant OWDs means R<A

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**Example of OWD variations**

12-hop path from U-Delaware to U-Oregon K=100 packets, A=74Mbps, T=100μsec Rleft = 97Mbps, Rright=34Mbps Ri

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**Iterative probing and Pathload**

Avail-bw time series from NLANR trace Another misconception in iterative probing approach is that it converge to single value. To understand why it is a fallacy, lets recap the methodology. Iterative probing sends multiple streams at different rates and startig at different time. Outcome of each stream is whether the probing rate is greater or smaller than abw. This figure shows the time series of avbw from a pakcet trace. As we can see, iterative probing inherently results in a range. Then the correct result is to report two rate values between which avbw varied. Iterative probing in Pathload: Send multiple probing streams (duration τ) at various rates Each stream samples path at different time interval Outcome of each stream is either Ri > A or Ri < A Estimate upper and lower bound for avail-bw variation range

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**Avail-bw estimation (b’): percentile estimation**

Manish Jain, Constantine Dovrolis, “End-to-End Estimation of the Available Bandwidth Variation Range,” ACM SIGMETRICS 2005

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**Avail-bw distribution and percentiles**

Avail-bw random process, in timescale t: At(t) Assume stationarity Marginal distribution of At: Ft(R) = Prob [At ≤ R] Ap :pth percentile of At, such that p = Ft(Ap) Objective: Estimate variation range [AL, AH] for given averaging timescale t AL and AH are pL and pH percentiles of At Typically, pL =0.10 and pH =0.90

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**Percentile sampling E[ I(R,N) ] = Ft(R) * N**

Question : Which percentile of At corresponds to rate R? Given R and t, estimate Ft(R) Assume that Ft(R) is inversible Sender transmits periodic packet stream of rate R Length of stream = measurement timescale t Receiver classifies stream as Type-G if At ≤ R: I(R)= 1 with probability Ft(R) Type-L otherwise: I(R)= 0 with probability 1-Ft(R) Collect N samples of I(R) by sending N streams of rate R Number of type-G streams: I(R,N)= Σi Ii(R) E[ I(R,N) ] = Ft(R) * N Percentile rank of probing rate R: Ft(R) = E[I(R,N)] / N Use I(R,N)/N as estimator of Ft(R)

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**Non-parametric estimation**

Does not assume specific avail-bw distribution Iterative algorithm Stationarity requirement across iterations N-th iteration: probing rate Rn Use percentile sampling to estimate percentile rank of Rn To estimate the upper percentile AH with pH = Ft(AH): fn = I(Rn,N)/N If fn is between pH±r, report AH = Rn Otherwise, If fn > pH + r, set Rn+1 < Rn If fn < pH - r, set Rn+1 > Rn Similarly, estimate the lower percentile AL

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**Validation example Verification using real Internet traffic traces**

b=0.05 b=0.15 Non-parametric estimator tracks variation range within 10-20% Selection of b depends on traffic Traffic spikes/dips may not be detected if b is too small But larger b causes larger MSRE

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**Parametric estimation**

Assume Gaussian avail-bw distribution Justified assumption for large degree of traffic multiplexing And/or for long averaging timescale (>200msec) Gaussian distribution completely specified by Mean m and standard deviation st pth percentile of Gaussian distribution Ap = m + st f-1(p) Sender transmits N probing streams of rates R1 and R2 Receiver determines percentiles ranks corresponding to R1 and R2 m and st can be then estimated by solving R1 = m + st f-1(p1) R2 = m + st f-1(p2) Variation range is then calculated from: AH = m + st f-1(pH) AL = m + st f-1(pL)

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**Validation example Verification using real Internet traffic traces**

Evaluated with both Gaussian and non-Gaussian traffic Gaussian traffic non-Gaussian traffic Parametric algorithm is more accurate than non-parametric algorithm, when traffic is good match to Gaussian model in non-stationary conditions

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**Avail-bw estimation (c’): PathChirp**

Vinay Ribeiro, Rolf Riedi, Jiri Navratil, Rich Baraniuk, Les Cottrell, “PathChirp: Efficient Available Bandwidth Estimation,” PAM 2003

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Chirp Packet Trains Exponentially decrease packet spacing within packet train Wide range of probing rates Efficient: few packets

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**Chirps vs. CBR Trains Multiple rates in each chirping train**

Allows one estimate per-chirp Potentially more efficient estimation

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**CBR Cross-Traffic Scenario**

Point of onset of increase in queuing delay gives available bandwidth

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**Comparison with Pathload**

100Mbps links pathChirp uses 10 times fewer bytes for comparable accuracy Available bandwidth Efficiency Accuracy pathchirp pathload pathChirp 10-90% Avg.min-max 30Mbps 0.35MB 3.9MB 19-29Mbps 16-31Mbps 50Mbps 0.75MB 5.6MB 39-48Mbps 39-52Mbps 70Mbps 0.6MB 8.6MB 54-63Mbps 63-74Mbps

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**Experimental comparison of avail-bw estimation tools**

Alok Shriram, Marg Murray, Young Hyun, Nevil Brownlee, Andre Broido, k claffy, ”Comparison of Public End-to-End Bandwidth Estimation Tools on High-Speed Links,” PAM 2005

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Testbed topology

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**Accuracy comparison - SmartBits**

Direction 1, Measured AB Direction 2, Measured AB Actual AB

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**Accuracy comparison - TCPreplay**

Actual Available Bandwidth Measured Available Bandwidth

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**What’s wrong with Spruce?**

Spruce was proposed as fast & accurate estimation method Strauss et al., IMC’03: example of direct probing With a single-link model: Sender sends periodic stream with input rate Ri Receiver measures output rate Ro Avail-bw A given by: Assumptions: Tight link capacity Ct is known Input rate Ri can be controlled by source But what would happen in a multi-hop path? Ri can be less than source rate (due to previous link with lower capacity) and, even worse, it can be unknown!

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**Measurement latency comparison**

Abing: 1.3 to 1.4 s Spruce: 10.9 to 11.2 s Pathload: 7.2 to 22.3 s Patchchirp: 5.4 s Iperf: 10.0 to 10.2 s

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**Probing traffic comparison**

CHANGE TO COLOR VERSION

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**Applications of bandwidth estimation**

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**Applications of bandwidth estimation**

Large TCP transfers and congestion control Bandwidth-delay product estimation Socket buffer sizing Streaming multimedia Adjust encoding rate based on avail-bw Intelligent routing systems Overlay networks and multihoming Select best path based on capacity or avail-bw Content Distribution Networks (CDNs) Choose server based on least-loaded path SLA and QoS verification Monitor path load and allocated capacity End-to-end admission control Network “spectroscopy” Several more..

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**Application-1: Improved TCP Throughput with BwEst**

Ravi S. Prasad, Manish Jain, Constantine Dovrolis, “Socket Buffer Auto-Sizing for High-Performance Data Transfers,” Journal of Grid Computing, 2003

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**TCP performs poorly in fat-long paths**

Basic idea in TCP congestion control: Increase congestion window until packet loss occurs Then reduce window by a factor of two (multiplicative decrease) Consequences Increased loss-rate Avg. throughput less than available bandwidth Large delay-variation Example: 1Gbps path, 100msec RTT, 1500B pkts Single loss ≈ 4000 pkts window reduction Recovery from single loss ≈ 400 sec Need very small loss probability (ρ<2*10-8) to saturate path

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**TCP background Ws = min {Bs, Wc, Wr}**

Sender Receiver Socket Layer TCP Layer Socket-layer buffers Send buffer: Bs Receive buffer: Br Socket Buffer TCP windows Send: Ws <= Bs Congestion: Wc Receiver (advertised): Wr<= Br Wr Ws Ws = min {Bs, Wc, Wr} Ideally, TCP send window Ws should be set to connection’s bandwidth-delay product “Bandwidth”: connection’s fair share “Delay”: connection’s RTT Achieve efficiency, fairness, no congestion

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**Can we avoid congestive losses w/o changing TCP?**

Ws = min {Wc, Wr} But Wr<= S S: rcv socket buffer size We can limit S so that connection is limited by receive window: Ws = S Non-congested path: Throughput R(S) = S/T(S) R(S) increases with S until it reaches MFT MFT: Maximum Feasible Throughput (onset of congestion) Objective: set S close to MFT, to avoid any losses and stabilize TCP send window to a safe value Congested path: Path with losses before start of target transfer Limiting S can only reduce throughput

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**Socket buffer auto-sizing (SOBAS)**

Apply SOBAS only in non-congested paths Receiving application measures rcv-throughput Rrcv When receive throughput becomes constant: Connection has reached its maximum throughput Rmax If the send window becomes any larger, losses will occur Receiving application limits rcv socket buffer size S: S = RTT * Rmax With congestion unresponsive cross traffic: Rmax = A With congestion responsive cross traffic: Rmax = MFT SOBAS does not require any changes in TCP But estimation of RTT and congestion-status requires “ping-like” probing

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**Measurements at WAN path**

Non-SOBAS SOBAS Path: GaTech to LBL,CA SOBAS flow get higher average throughput than non-SOBAS flow because former avoids all congestion losses SOBAS does not significantly increase path’s RTT

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To conclude..

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**Things I have not talked about**

Other estimation tools & techniques Abing, netest, pipechar, STAB, pathneck, IGI/PTR, … Per-hop capacity estimation (pathchar, clink, pchar) Other applications Bwest in new TCPs (e.g., TCP Westwood, TCP FAST) Bwest in wireless nets Bwest in overlay routing Bwest in multihoming Bwest in bottleneck detection Scalable bandwidth measurements in networks with many monitoring nodes Practical issues Interrupt coalescence Traffic shapers Non-FIFO queues

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**Conclusions We know how to do the following:**

Estimate e2e capacity & avail-bw Apply bwest in several applications We know that we cannot do the following: Estimate per-hop capacity with VPS techniques Avoid avail-bw estimation bias when traffic is bursty and/or path has multiple bottlenecks We do not yet know how to do the following: Scalable bandwidth measurements Integrate probing traffic in application data Many research questions are still open Help wanted!

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