# A Primal-Dual Approach to Online Optimization Problems.

## Presentation on theme: "A Primal-Dual Approach to Online Optimization Problems."— Presentation transcript:

A Primal-Dual Approach to Online Optimization Problems

Online Optimization Problems input arrives piece by piece (piece is called request) upon arrival of a request - has to be served immediately past decisions cannot be revoked how to evaluate the performance of an online algorithm? –if, for each request sequence, cost(online) r x cost(optimal offline) –then online algorithm is r-competitive

Road Map Introducing the framework: Ski rental Online set cover Virtual circuit routing The general framework: {0,1} covering/packing linear programs General covering/packing linear programs Recent results: The ad-auctions problem Weighted caching

The Ski Rental Problem Buying costs \$B. Renting costs \$1 per day. Problem: Number of ski days is not known in advance. Goal: Minimize the total cost.

Ski Rental – Integer Program Subject to: For each day i:

D: Dual Packing For each day i: Ski Rental – Relaxation P: Primal Covering For each day i: Online setting: Primal: New constraints arrive one by one. Requirement: Upon arrival, constraints should be satisfied. Monotonicity: Variables can only be increased.

D: Dual Packing For each day i: Ski Rental – Algorithm P: Primal Covering For each day i: Initially x 0 Each new day (new constraint): if x<1: z i 1-x x x(1+ 1/B) + 1/(c*B) - c later. y i 1

Analysis of Online Algorithm Proof of competitive factor: 1.Primal solution is feasible. 2.In each iteration, ΔP (1+ 1/c)ΔD. 3.Dual is feasible. Conclusion: Algorithm is (1+ 1/c)-competitive Initially x 0 Each new day (new constraint): if x<1: z i 1-x x x(1+ 1/B) + 1/(c*B) - c later. y i 1

Analysis of Online Algorithm 1.Primal solution is feasible. If x 1 the solution is feasible. Otherwise set: z i 1-x. 2.In each iteration, ΔP (1+ 1/c)ΔD: If x1, ΔP =ΔD=0 Otherwise: Change in dual: 1 Change in primal: BΔx + z i = x+ 1/c+ 1-x = 1+1/c Algorithm: When new constraint arrives, if x<1: z i 1-x x x(1+ 1/B) + 1/c*B y i 1

Analysis of Online Algorithm 3.Dual is feasible: Need to prove: We prove that after B days x1 x is a sum of geometric sequence a 1 = 1/(cB), q = 1+1/B Algorithm: When new constraint arrives, if x<1: z i 1-x x x(1+ 1/B) + 1/c*B y i 1

Randomized Algorithm Choose d uniformly in [0,1] Buy on the day corresponding to the bin d falls in Rent up to that day Analysis: Probability of buying on the i-th day is x i Probability of renting on the i-th day is at most z i X1X1 X2X2 X3X3 X4X4 0 1 X:

Key Idea for Primal-Dual Primal: Min i c i x i Dual: Max t b t y t Step t, new constraint: New variable y t a 1 x 1 + a 2 x 2 + … + a j x j b t + b t y t in dual objective x i (1+ a i /c i ) x i (mult. update) y t y t + 1 (additive update) primal cost = = Dual Cost

The Online Set-Cover Problem Elements: e 1, e 2, …, e n Set system: s 1, s 2, … s m Costs: c(s 1 ), c(s 2 ), … c(s m ) Online Setting: Elements arrive one by one. Upon arrival elements need to be covered. Sets that are chosen cannot be unchosen. Goal: Minimize the cost of the chosen sets.

D: Dual Packing Set Cover – Linear Program P: Primal Covering Online setting: Primal: constraints arrive one by one. Requirement: each constraint is satisfied. Monotonicity: variables can only be increased.

D: Dual Packing Set Cover – Algorithm P: Primal Covering Initially x(s) 0 When new element arrives, while y(e) y(e)+1.

Analysis of Online Algorithm Proof of competitive factor: 1.Primal solution is feasible. 2.In each iteration, ΔP 2ΔD. 3.Dual is (almost) feasible. Conclusion: We will see later. Initially x(S) 0 When new element e arrives, while y(e) y(e)+1.

Analysis of Online Algorithm 1.Primal solution is feasible. We increase the primal variables until the constraint is feasible. Initially x(S) 0 When new element e arrives, while y(e) y(e)+1.

Analysis of Online Algorithm 2.In each iteration, ΔP 2ΔD. In each iteration: ΔD = 1 Initially x(S) 0 When new element e arrives, while y(e) y(e)+1.

Analysis of Online Algorithm 3.Dual is (almost) feasible: We prove that: If y(e) increases, then x(s) increases (for e in S). x(s) is a sum of a geometric series: a 1 = 1/[mc(s)], q = (1+ 1/c(s)) Initially x(S) 0 When new element e arrives, while y(e) y(e)+1.

Analysis of Online Algorithm After c(s)O(log m) rounds: We never increase a variable x(s)>1! Initially x(S) 0 When new element e arrives, while y(e) y(e)+1.

Conclusion The dual is feasible with cost 1/O(log m) of the primal. The algorithm produces a fractional set cover that is O(log m)-competitive. Remark: No online algorithm can perform better in general. What about an integral solution? Round fractional solution. (With O(log n) amplification.) Can be done deterministically online [AAABN03]. Competitive ratio is O(log m log n).

Online Virtual Circuit Routing Network graph G=(V, E) capacity function u: E Z + Requests: r i = (s i, t i ) Problem: Connect s i to t i by a path, or reject the request. Reserve one unit of bandwidth along the path. No re-routing is allowed. Load: ratio between reserved edge bandwidth and edge capacity. Goal: Maximize the total throughput.

Routing – Linear Program s.t: For each r i : For each edge e: = Amount of bandwidth allocated for r i on path p - Available paths to serve request r i

D: Dual Packing Routing – Linear Program P: Primal Covering Online setting: Dual: new columns arrive one by one. Requirement: each dual constraint is satisfied. Monotonicity: variables can only be increased.

D: Dual Packing Routing – Algorithm P: Primal Covering Initially x(e) 0 When new request arrives, if z(r i ) 1. y(r i,p) 1

Analysis of Online Algorithm Proof of competitive factor: 1.Primal solution is feasible. 2.In each iteration, ΔP 3ΔD. 3.Dual is (almost) feasible. Conclusion: We will see later. Initially x(e) 0 When new request arrives, if z(r i ) 1. y(r i,p) 1

Analysis of Online Algorithm 1.Primal solution is feasible. If the solution is feasible. Otherwise: we update z(r i ) 1 Initially x(e) 0 When new request arrives, if z(r i ) 1. y(r i,p) 1

Analysis of Online Algorithm 2.In each iteration: ΔP 3ΔD. If ΔP = ΔD=0 Otherwise: ΔD=1 Initially x(e) 0 When new request arrives, if z(r i ) 1. y(r i,p) 1

Analysis of Online Algorithm 3.Dual is (almost) feasible. We prove: For each e, after routing u(e)O(log n) on e, x(e)1 x(e) is a sum of a geometric sequence x(e) 1 = 1/(nu(e)), q = 1+1/u(e) After u(e)O(log n) requests:

New Results via P-D Approach: Routing Previous results (routing/packing): [AAP93] – Route O(log n) fraction of the optimal without violating capacity constraints. Capacities must be at least logarithmic. [AAFPW94] – Route all the requests with load of at most O(log n) times the optimal load. Observation [BN06] – Both results can be described within the primal-dual approach.

New Results via P-D Approach: Routing We saw a simple algorithm which is: 3-competitive and violates capacities by O(log n) factor. Can be improved [Buchbinder, Naor, FOCS06] to: 1-competitive and violates capacities by O(log n) factor. Non Trivial. Main ideas: Combination of ideas drawn from casting of previous routing algorithms within the primal-dual approach. Decomposition of the graph. Maintaining several primal solutions which are used to bound the dual solution, and for the routing decisions.

New Results via P-D Approach: Routing Applications [Buchbinder, N, FOCS 06]: Can be used as black box for many objective functions and in many routing models: –Previous Settings [AAP93,APPFW94]. –Maximizing throughput. –Minimizing load. –Achieving better global fairness results (Coordinate competitiveness).

Road Map Introducing the framework: Ski rental Online set cover Virtual circuit routing The general framework: {0,1} covering/packing linear programs General covering/packing linear programs Recent results: The ad-auctions problem Weighted caching

Online Primal-Dual Approach Can the offline problem be cast as a linear covering/packing program? Can the online process be described as: –New rows appearing in a covering LP? –New columns appearing in a packing LP? Yes ?? Upon arrival of a new request: –Update primal variables in a multiplicative way. –Update dual variables in an additive way.

Online Primal Dual Approach Next Prove: 1.Primal solution is feasible (or nearly feasible). 2.In each round, ΔP c ΔD. 3.Dual is feasible (or nearly feasible). Got a fractional solution, but need an integral solution ?? Randomized rounding techniques might work. Sometimes, even derandomization (e.g., method of conditional probabilities) can be applied online!

Online Primal-Dual Approach Advantages: 1.Generic ideas and algorithms applicable to many online problems. 2.Linear Program helps detecting the difficulties of the online problem. 3.General recipe for the design and analysis of online algorithms. 4.No potential function appearing out of nowhere. 5.Competitiveness with respect to a fractional optimal solution.

General Covering/Packing Results What can you expect to get? For a {0,1} covering/packing matrix: –Competitive ratio O(log D) [BN05] (D – max number of non-zero entries in a constraint). Remarks: Fractional solutions. Number of constraints/variables can be exponential. There can be a tradeoff between the competitive ratio and the factor by which constraints are violated.

General Covering/Packing Results For a general covering/packing matrix [BN05] : Covering: –Competitive ratio O(log n) (n – number of variables). Packing: –Competitive ratio O(log n + log [a(max)/a(min)]) a(max), a(min) – maximum/minimum non-zero entry Remarks: Results are tight.

Special Cases The max number of non-zero entries in a constraint is a constant? You can get a constant ratio. The max number of non-zero entries in a constraint is 2? Calls for an e/(e-1)-ratio. Examples: Ski rental, Online matching, Ad-Auctions.

Known Results via P-D Approach Covering Online Problems (Minimization): O(log k)-algorithm for weighted caching [BBN07] Ski rental, Dynamic TCP Acknowledgement Parking Permit Problem [Meyerson 05] Online Set Cover [AAABN03] Online Graph Covering Problems [AAABN04]: –Non-metric facility location –Generalized connectivity: pairs arrive online –Group Steiner: groups arrive online –Online multi-cut: (s,t)--pairs arrive online

Known Results via P-D Approach Packing Online Problems (maximization): Online Routing/Load Balancing Problems [AAP93, AAPFW93, BN06 ]. General Packing/routing e.g. Multicast trees. Online Matching [KVV91] – Nodes arrive one-by-one. Ad-Auctions Problem [MSVV05] – In a bit …

Road Map Introducing the framework: Ski rental Online set cover Virtual circuit routing The general framework: {0,1} covering/packing linear programs General covering/packing linear programs Recent results: The ad-auctions problem Weighted caching

What are Ad-Auctions? You type in a search engine: You get: Algorithmic Search results And … Advertisements Vacation Eilat

How do search engines sell ads? Each advertiser: – Sets a daily budget – Provides bids on interesting keywords Search Engine (on each keyword): – Selects ads – Advertiser pays bid if user clicks on ad. Goal (of Search engine): Maximize revenue

Mathematical Model Buyer i: – Has a daily budget B(i) Online Setting: –Items (keywords) arrive one-by-one. –Each buyer gives a bid on each of the items (can be zero) Algorithm: –Assigns each item to some interested buyer. Assumption: Bids are small compared to the daily budget.

Ad-Auctions – Linear Program s.t: For each item j: For each buyer i: I - Set of buyers. J - Set of items. = 1 j-th ad-auction is sold to buyer i. B(i) – Budget of buyer i b(i,j) – bid of buyer i on item j Each item is sold once. Buyers do not exceed their budget

Results [ MSVV FOCS 05]: (1-1/e)-competitive online algorithm. Bound is tight. Analysis uses tradeoff revealing family of LPs - not very intuitive. Our Results [Buchbinder, Jain, N, 2007]: A different approach based on the primal-dual method: very simple and intuitive … and extensions. Techniques are applicable to many other problems.

Extensions – Getting more revenue Seller wants to sell several advertisements in each round (to different bidders). Additional stochastic information is known. The number of buyers interested in each item is small. General risk management of the buyers.

The Paging/Caching Problem Set of n pages, cache of size k<n. Request sequence of pages 1, 6, 4, 1, 4, 7, 6, 1, 3, … If requested page is in cache, no penalty. Else, cache miss! And load page into cache, (possibly) evicting some page. Goal: Minimize the number of cache misses. Main Question: Which page to evacuate?

Previous Results: Paging Paging (Deterministic) [Sleator Tarjan 85]: Any det. algorithm >= k-competitive. LRU is k-competitive (also other algorithms) LRU is k/(k-h+1)-competitive if optimal has cache of size h<k Paging (Randomized): Rand. Marking O(log k) [Fiat, Karp, Luby, McGeoch, Sleator, Young 91]. Lower bound H k [Fiat et al. 91], tight results known. O(log(k/k-h+1))-competitive algorithm if optimal has cache of size h<k [Young 91]

The Weighted Paging Problem One small change: Each page i has a different load cost w(i). Models scenarios in which the cost of bringing pages is not uniform: Main memory, disk, internet … Goal Minimize the total cost of cache misses. web

Weighted Paging (Previous Work) Lower bound k LRU k competitive k/(k-h+1) if opts cache size h k-competitive [Chrobak, Karloff, Payne, Vishwanathan 91] k/(k-h+1) [Young 94] O(log k) Randomized Marking O(log k/(k-h+1)) O(log k) for two weight classes [Irani 02] No o(k) algorithm known even for 3 weight classes. Paging Weighted Paging Deterministic Randomized

The k-server Problem k servers lie in an n-point metric space. Requests arrive at metric points. To serve request: Need to move some server there. Goal: Minimize total movement cost Paging = k-server on a uniform metric. (every page is a point, page in cache iff server on the point) Weighted paging = k-server on a weighted star metric.

The k-server Problem k servers lie in an n-point metric space. Requests arrive at metric points. To serve request: Need to move some server there. Goal: Minimize total movement cost (2k-1) Det. Work Function Alg [Koutsoupias, Papadimitriou 95] Randomized. No o(k) known (even for very simple spaces). Best lower bound (log k) (widely believed conjecture)

Our Results Weighted Paging (Randomized): (Bansal, Buchbinder, N., FOCS 2007) O(log k)-competitive algorithm for weighted paging. O(log (k/k-h+1))-competitive if opts cache size h<k. Much simpler than previous approaches. Metrical Task System (Randomized): O(log N)-competitive algorithm on a weighted star metric. Closely related to k-server problem (details in paper …)

Further Research Generalized Caching Pages have both sizes and fetching costs. Motivation: Web-Caching Special models: Bit model: Fetching cost proportional to size (minimize traffic) Fault model: Fetching cost is uniform (minimize number of times a user has to wait for a page) Results (Bansal, Buchbinder, N., 2008): O(log k)-competitive algorithms for Bit and Fault models. O(log 2 k)-competitive algorithm for the general model. Requires new interesting ideas and interesting analysis in the rounding phase.

Further Research More applications. Extending the general framework beyond packing/covering. The k-server problem?

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