Shrinking Maxima, Decreasing Costs: New Online Packing and Covering Problems
|
|
- Pauline Peters
- 6 years ago
- Views:
Transcription
1 Shrinking Maxima, Decreasing Costs: New Online Packing and Covering Problems Pierre Fraigniaud Magnús M. Halldórsson Boaz Patt-Shamir CNRS, U. Paris Diderot Dror Rawitz Tel Aviv U. Reykjavik U. Adi Rosén CNRS, U. Paris Diderot Tel Aviv U. Narrated by: Moti Medina (Tel Aviv U.) Shrinking Maxima, Decreasing Costs APPROX / 15
2 Motivation: Video Transmission Over Networks Large Data Items Sequence consisting of large frames (I-frames: SD hundreds of Kb; HD several Mb) Small Transfer Units IP packet size 64Kb Practically 1.5Kb (Ethernet) Shrinking Maxima, Decreasing Costs APPROX / 15
3 Motivation: Video Transmission Over Networks Large Data Items Sequence consisting of large frames (I-frames: SD hundreds of Kb; HD several Mb) Small Transfer Units IP packet size 64Kb Practically 1.5Kb (Ethernet) Link Ingresses Problem Packets arrive in bursts at an outgoing link of a router In case of an overflow: which packet to serve? to drop? If packets are dropped, the whole frame may be lost! Shrinking Maxima, Decreasing Costs APPROX / 15
4 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Shrinking Maxima, Decreasing Costs APPROX / 15
5 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 1 Shrinking Maxima, Decreasing Costs APPROX / 15
6 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: Dropped: F 1 Shrinking Maxima, Decreasing Costs APPROX / 15
7 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 5 F 2 Dropped: F 1 Shrinking Maxima, Decreasing Costs APPROX / 15
8 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 Dropped: F 1 F 5 Shrinking Maxima, Decreasing Costs APPROX / 15
9 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 6 F 2 F 1 Dropped: F 1 F 5 Shrinking Maxima, Decreasing Costs APPROX / 15
10 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 Dropped: F 1 F 5 F 1 Shrinking Maxima, Decreasing Costs APPROX / 15
11 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 5 F 2 F 6 F 2 Dropped: F 1 F 5 F 1 Shrinking Maxima, Decreasing Costs APPROX / 15
12 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 Dropped: F 1 F 5 F 1 F 2 F 5 Shrinking Maxima, Decreasing Costs APPROX / 15
13 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 6 F 4 F 2 F 6 Dropped: F 1 F 5 F 1 F 2 F 5 Shrinking Maxima, Decreasing Costs APPROX / 15
14 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 Dropped: F 1 F 5 F 1 F 2 F 4 F 5 F 6 Shrinking Maxima, Decreasing Costs APPROX / 15
15 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 F 1 Dropped: F 1 F 5 F 1 F 2 F 4 F 5 F 6 Shrinking Maxima, Decreasing Costs APPROX / 15
16 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 4 F 2 F 6 F 1 F 2 Dropped: F 1 F 5 F 1 F 2 F 4 F 5 F 6 Shrinking Maxima, Decreasing Costs APPROX / 15
17 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 F 1 F 2 Dropped: F 1 F 5 F 1 F 2 F 4 F 4 F 5 F 6 Shrinking Maxima, Decreasing Costs APPROX / 15
18 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 F 1 F 2 F 5 Dropped: F 1 F 5 F 1 F 2 F 4 F 4 F 5 F 6 Shrinking Maxima, Decreasing Costs APPROX / 15
19 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 F 1 F 2 F 5 alg = { } Dropped: F 1 F 5 F 1 F 2 F 4 F 4 F 5 F 6 Shrinking Maxima, Decreasing Costs APPROX / 15
20 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 F 1 F 2 alg = { } F 5 opt = {F 1, F 4, F 5 } Dropped: F 1 F 5 F 1 F 2 F 4 F 4 F 5 F 6 Shrinking Maxima, Decreasing Costs APPROX / 15
21 Multi-Part Tasks Online Scenario: Bursts arrive one by one Each packet belongs to some data item Upon arrival a burst, we transmit one packet, and the rest are dropped Number of bursts and number of data items are unknown Example: F 2 F 6 F 1 F 2 alg = { } F 5 opt = {F 1, F 4, F 5 } Dropped: F 1 F 5 F 1 F 2 F 4 F 4 F 5 F 6 x 2 + x 5 1 x 3 + x 4 + x 6 1 Shrinking Maxima, Decreasing Costs APPROX / 15
22 Online Packing Integer Programs (OPIP) Packing Integer Program: a ij ith requirement of item j b j benefit for item j c i capacity of ith constraint p j upper bound on # copies of j max s.t. n j=1 b jx j n j=1 a ijx j c i x j p j x j N i j j Shrinking Maxima, Decreasing Costs APPROX / 15
23 Online Packing Integer Programs (OPIP) Packing Integer Program: a ij ith requirement of item j b j benefit for item j c i capacity of ith constraint p j upper bound on # copies of j max s.t. n j=1 b jx j n j=1 a ijx j c i x j p j x j N i j j Online PIP: Init: x j = p j, for all i Knapsack constraints (rows) arrive one by one Variables may only decrease Shrinking Maxima, Decreasing Costs APPROX / 15
24 Online Packing Integer Programs (OPIP) Packing Integer Program: a ij ith requirement of item j b j benefit for item j c i capacity of ith constraint p j upper bound on # copies of j max s.t. n j=1 b jx j n j=1 a ijx j c i x j p j x j N i j j Online PIP: Init: x j = p j, for all i Knapsack constraints (rows) arrive one by one Variables may only decrease Standard Online Model: [Awerbuch Azar Plotkin 93], [Buchbinber Naor 09] Columns arrive one by one Upon arrival of a column, algorithm may accept or reject Variables may increase Shrinking Maxima, Decreasing Costs APPROX / 15
25 OPIP Related Work Special Cases: Independent Set Set Packing k-dimensional Matching Not approximable within O( k log k ) [Hazan et al. 03] Shrinking Maxima, Decreasing Costs APPROX / 15
26 OPIP Related Work Special Cases: Independent Set Set Packing k-dimensional Matching Not approximable within O( k log k ) [Hazan et al. 03] Competitive ratios depend on Max column: C = max j Pi a ij Max row: R = max i Pj a ij Max overload ratio: ρ = max i 1 c i Pj a ij Shrinking Maxima, Decreasing Costs APPROX / 15
27 OPIP Related Work Special Cases: Independent Set Set Packing k-dimensional Matching Not approximable within O( k log k ) [Hazan et al. 03] Competitive ratios depend on Max column: C = max j Pi a ij Max row: R = max i Pj a ij Max overload ratio: ρ = max i 1 c i Pj a ij Scheduling with Interval Conflicts: [Halldórsson Patt-Shamir Rawitz 11] Consecutive ones constraints Ω(log R) (centralized) and O(log R) (distributed) Shrinking Maxima, Decreasing Costs APPROX / 15
28 OPIP Previous and Our Results Online Set Packing [Emek Halldórsson Mansour Patt-Shamir Radhakrishnan Rawitz 10] A = {0, 1} m n, c = 1 m, p = 1 n Deterministic Lower Bound: R C 1 Randomized Lower Bound: Ω Centralized C R in construction Randomized Upper Bound: C R Distributed Extends to capacitated OSP: 2C ρ ( C R ( log log C log C ) 2 ) Shrinking Maxima, Decreasing Costs APPROX / 15
29 OPIP Previous and Our Results Online Set Packing [Emek Halldórsson Mansour Patt-Shamir Radhakrishnan Rawitz 10] A = {0, 1} m n, c = 1 m, p = 1 n Deterministic Lower Bound: R C 1 Randomized Lower Bound: Ω Centralized C R in construction Randomized Upper Bound: C R Distributed Extends to capacitated OSP: 2C ρ ( C R ( log log C log C ) 2 ) Our Result #1: Extend OSP upper bound to OPIP p = 1 n : 2C ρ-competitive algorithm Similar, but not the same algorithm p 1 n : Additional max j p j factor Shrinking Maxima, Decreasing Costs APPROX / 15
30 Randomized Algorithm for OPIP Special case: b = 1 n unweighted p = 1 n single copy per item c = u n uniform capacities Shrinking Maxima, Decreasing Costs APPROX / 15
31 Randomized Algorithm for OPIP Special case: b = 1 n unweighted p = 1 n single copy per item c = u n uniform capacities Algorithm: For each item j pick a random priority r(j) U[0, 1] Upon arrival of a constraint: Construct u subsets S i1,...,s iu Choose a ij subsets at random for item j For each subset S il reject all items but the one with highest priority Shrinking Maxima, Decreasing Costs APPROX / 15
32 Randomized Algorithm for OPIP Special case: b = 1 n unweighted p = 1 n single copy per item c = u n uniform capacities Algorithm: For each item j pick a random priority r(j) U[0, 1] Upon arrival of a constraint: Construct u subsets S i1,...,s iu Choose a ij subsets at random for item j For each subset S il reject all items but the one with highest priority Advantages: Relatively simple Oblivious decisions Shrinking Maxima, Decreasing Costs APPROX / 15
33 Intuition for a Weaker Result Reduction to unit capacities: Constraint i becomes u constraints Randomly choose a ij constraints j X a ij x j c i = j 8 X x k 1 k S X i1 x k 1 >< k S i2. X x >: k 1 k S iu Shrinking Maxima, Decreasing Costs APPROX / 15
34 Intuition for a Weaker Result Reduction to unit capacities: Constraint i becomes u constraints Randomly choose a ij constraints j Neighborhood of item j: N(j) = {k j : S il s.t. j, k S il } X a ij x j c i = j 8 X x k 1 k S X i1 x k 1 >< k S i2. X x >: k 1 k S iu Shrinking Maxima, Decreasing Costs APPROX / 15
35 Intuition for a Weaker Result Reduction to unit capacities: Constraint i becomes u constraints Randomly choose a ij constraints j Neighborhood of item j: N(j) = {k j : S il s.t. j, k S il } Claim: E[N(j)] < ρc X a ij x j c i = j 8 X x k 1 k S X i1 x k 1 >< k S i2. X x >: k 1 k S iu # of potential neighbors of j in constraint i is P k j a ik On average, each copy of j meets 1 of potential neighbors u E[N(j)] = P a ij P i u k j a ik < RC u = ρc Shrinking Maxima, Decreasing Costs APPROX / 15
36 Intuition for a Weaker Result Reduction to unit capacities: Constraint i becomes u constraints Randomly choose a ij constraints j Neighborhood of item j: N(j) = {k j : S il s.t. j, k S il } Claim: E[N(j)] < ρc X a ij x j c i = j 8 X x k 1 k S X i1 x k 1 >< k S i2. X x >: k 1 k S iu # of potential neighbors of j in constraint i is P k j a ik On average, each copy of j meets 1 of potential neighbors u E[N(j)] = P a ij P i u k j a ik < RC u = ρc Claim: Pr[j alg] 1 2ρC Markov Shrinking Maxima, Decreasing Costs APPROX / 15
37 Intuition for a Weaker Result Reduction to unit capacities: Constraint i becomes u constraints Randomly choose a ij constraints j Neighborhood of item j: N(j) = {k j : S il s.t. j, k S il } Claim: E[N(j)] < ρc X a ij x j c i = j 8 X x k 1 k S X i1 x k 1 >< k S i2. X x >: k 1 k S iu # of potential neighbors of j in constraint i is P k j a ik On average, each copy of j meets 1 of potential neighbors u E[N(j)] = P a ij P i u k j a ik < RC u = ρc Claim: Pr[j alg] 1 2ρC Markov alg is 2ρC-competitive: E[ alg ] j Pr[j alg] n 2ρC opt 2ρC Shrinking Maxima, Decreasing Costs APPROX / 15
38 Dual: Online Team Formation (OTF) PIP: max n j=1 b jx j s.t. n j=1 a ijx j c i x j p j x j N i j j Dual: min m i=1 c iy i + n j=1 p jz j m s.t. i=1 a ijy i + z j b j y i N z j N j i j Shrinking Maxima, Decreasing Costs APPROX / 15
39 Dual: Online Team Formation (OTF) PIP: max n j=1 b jx j s.t. n j=1 a ijx j c i x j p j x j N i j j Dual: min m i=1 c iy i + n j=1 p jz j m s.t. i=1 a ijy i + z j b j y i N z j N j i j Multi-Covering with Penalties: b j covering requirement of element j p j penalty of element j c i cost of set i a ij coverage of element j by set i Shrinking Maxima, Decreasing Costs APPROX / 15
40 Online Team Formation Motivation Special case: A {0, 1} n m, b = 1 n Skills: min s.t. We are embarking on a new project n skills are required Can obtain skill j by outsourcing for cost p j Candidates: Arrive online Candidate i has several skills and cost c i Interview dilemma: to hire or not to hire? A candidate not hired is gone! Goal: minimize project cost m i=1 c iy i + n j=1 p jz j n i=1 a ijy i + z j 1 y i {0, 1} z j {0, 1} j i j Shrinking Maxima, Decreasing Costs APPROX / 15
41 OTF Related Work Online Set Cover: [Alon Awerbuch Azar Buchbinder Naor 09] Items arrive online Cover grows with time Different model! Shrinking Maxima, Decreasing Costs APPROX / 15
42 OTF Related Work Online Set Cover: [Alon Awerbuch Azar Buchbinder Naor 09] Items arrive online Cover grows with time Different model! Secretary Problem: [Gilbert Mosteller 66], [Freeman 83] Similar to OTF: Decision about a candidate must be taken immediately upon arrival Candidates arrive in random order Goal is to pick best candidate Number of candidates is known Shrinking Maxima, Decreasing Costs APPROX / 15
43 OTF Results Lazy Approach: Do absolutely nothing! highest cost of covering j γ-competitive, where γ = max j lowest cost of covering j γ = ρ, if p = 1 m Shrinking Maxima, Decreasing Costs APPROX / 15
44 OTF Results Lazy Approach: Do absolutely nothing! highest cost of covering j γ-competitive, where γ = max j lowest cost of covering j γ = ρ, if p = 1 m Threshold Approach: Hire candidates that are γ-cost effective w.r.t. residual requirements O( γ)-competitive deterministic algorithm Requires prior knowledge of γ Shrinking Maxima, Decreasing Costs APPROX / 15
45 OTF Results Lazy Approach: Do absolutely nothing! highest cost of covering j γ-competitive, where γ = max j lowest cost of covering j γ = ρ, if p = 1 m Threshold Approach: Hire candidates that are γ-cost effective w.r.t. residual requirements O( γ)-competitive deterministic algorithm Requires prior knowledge of γ Proactive Approach: We are allowed to fire (but is not allowed to rehire) Ω( γ) randomized lower bound Applies even if γ is known Shrinking Maxima, Decreasing Costs APPROX / 15
46 OTF Threshold Algorithm Special Case: A {0, 1} n m b = 1 n, p = 1 n c = 1 m Shrinking Maxima, Decreasing Costs APPROX / 15
47 OTF Threshold Algorithm Special Case: A {0, 1} n m b = 1 n, p = 1 n c = 1 m γ = maximum number of skills per candidate Shrinking Maxima, Decreasing Costs APPROX / 15
48 OTF Threshold Algorithm Special Case: A {0, 1} n m b = 1 n, p = 1 n c = 1 m γ = maximum number of skills per candidate Threshold Algorithm: Hire arriving candidate if it covers γ uncovered skills Shrinking Maxima, Decreasing Costs APPROX / 15
49 OTF Threshold Algorithm Special Case: A {0, 1} n m b = 1 n, p = 1 n c = 1 m γ = maximum number of skills per candidate Threshold Algorithm: Hire arriving candidate if it covers γ uncovered skills Analysis : Covered skill: alg pays at most 1 γ, opt pays at least 1 γ Uncovered skill: alg pays at most 1, opt pays at least 1 γ Shrinking Maxima, Decreasing Costs APPROX / 15
50 OTF: Randomized Lower Bound There are p 2 skills, one for each point in Z p Z p Input Sequence: p 2 candidates, one for each line in Z p Z p Candidate i has skills that are contained in L i Shrinking Maxima, Decreasing Costs APPROX / 15
51 OTF: Randomized Lower Bound There are p 2 skills, one for each point in Z p Z p Input Sequence: p 2 candidates, one for each line in Z p Z p Candidate i has skills that are contained in L i Let h be the number of hired candidates: If E[h] [ p 2, p2 2 ]: stop = E[ alg ] = Ω(p 2 ), opt = O(p) Shrinking Maxima, Decreasing Costs APPROX / 15
52 OTF: Randomized Lower Bound There are p 2 skills, one for each point in Z p Z p Input Sequence: p 2 candidates, one for each line in Z p Z p Candidate i has skills that are contained in L i Let h be the number of hired candidates: If E[h] [ p 2, p2 2 ]: stop = E[ alg ] = Ω(p 2 ), opt = O(p) If E[h] [ p 2, p2 2 ]: Choose random L i, Introduce a new candidate: Z p Z p \ L i = E[ alg ] = Ω(p), opt = O(1) Shrinking Maxima, Decreasing Costs APPROX / 15
53 OTF: Randomized Lower Bound There are p 2 skills, one for each point in Z p Z p Input Sequence: p 2 candidates, one for each line in Z p Z p Candidate i has skills that are contained in L i Let h be the number of hired candidates: If E[h] [ p 2, p2 2 ]: stop = E[ alg ] = Ω(p 2 ), opt = O(p) If E[h] [ p 2, p2 2 ]: Choose random L i, Introduce a new candidate: Z p Z p \ L i = E[ alg ] = Ω(p), opt = O(1) Lower Bound: Ω(p) = Ω( γ) Shrinking Maxima, Decreasing Costs APPROX / 15
54 Conclusion Summary: O(C ρ)-competitive algorithm for OPIP O( γ)-competitive deterministic algorithm for OTF Ω( γ) randomized lower bound for OTF Shrinking Maxima, Decreasing Costs APPROX / 15
55 Conclusion Summary: O(C ρ)-competitive algorithm for OPIP O( γ)-competitive deterministic algorithm for OTF Ω( γ) randomized lower bound for OTF Open Problems: OPIP: lower bound for uniform non-unit capacity Shrinking Maxima, Decreasing Costs APPROX / 15
56 Conclusion Summary: O(C ρ)-competitive algorithm for OPIP O( γ)-competitive deterministic algorithm for OTF Ω( γ) randomized lower bound for OTF Open Problems: OPIP: lower bound for uniform non-unit capacity OTF: O( γ)-competitive algorithm when γ is unknown Algorithm must be allowed to fire candidates Shrinking Maxima, Decreasing Costs APPROX / 15
57 Conclusion Summary: O(C ρ)-competitive algorithm for OPIP O( γ)-competitive deterministic algorithm for OTF Ω( γ) randomized lower bound for OTF Open Problems: OPIP: lower bound for uniform non-unit capacity OTF: O( γ)-competitive algorithm when γ is unknown Algorithm must be allowed to fire candidates Shrinking Maxima, Decreasing Costs APPROX / 15
Online Scheduling with Interval Conflicts
Online Scheduling with Interval Conflicts Magnús M. Halldórsson 1, Boaz Patt-Shamir 2, and Dror Rawitz 2 1 School of Computer Science, Reykjavik University, Menntavegur 1, 101 Reykjavik, Iceland. mmh@ru.is
More informationOverflow Management with Multipart Packets
Overflow Management with Multipart Packets Yishay Mansour School of Computer Science Tel Aviv University Tel Aviv 69978, Israel mansour@cstauacil Boaz Patt-Shamir Dror Rawitz School of Electrical Engineering
More informationCompetitive Management of Non-Preemptive Queues with Multiple Values
Competitive Management of Non-Preemptive Queues with Multiple Values Nir Andelman and Yishay Mansour School of Computer Science, Tel-Aviv University, Tel-Aviv, Israel Abstract. We consider the online problem
More informationarxiv: v1 [cs.ds] 30 Jun 2016
Online Packet Scheduling with Bounded Delay and Lookahead Martin Böhm 1, Marek Chrobak 2, Lukasz Jeż 3, Fei Li 4, Jiří Sgall 1, and Pavel Veselý 1 1 Computer Science Institute of Charles University, Prague,
More informationOnline Interval Coloring and Variants
Online Interval Coloring and Variants Leah Epstein 1, and Meital Levy 1 Department of Mathematics, University of Haifa, 31905 Haifa, Israel. Email: lea@math.haifa.ac.il School of Computer Science, Tel-Aviv
More informationOnline Path Computation & Function Placement in SDNs
Online Path Computation & Function Placement in SDNs Guy Even Tel Aviv University Moti Medina MPI for Informatics Boaz Patt-Shamir Tel Aviv University Today s Focus: Online Virtual Circuit Routing Network:
More informationThe Online Set Cover Problem
The Online Set Cover Problem Noga Alon Baruch Awerbuch Yossi Azar Niv Buchbinder Joseph Seffi Naor Abstract Let X = {1, 2,..., n} be a ground set of n elements, and let S be a family of subsets of X, S
More informationA Dynamic Near-Optimal Algorithm for Online Linear Programming
Submitted to Operations Research manuscript (Please, provide the manuscript number! Authors are encouraged to submit new papers to INFORMS journals by means of a style file template, which includes the
More informationOnline Selection Problems
Online Selection Problems Imagine you re trying to hire a secretary, find a job, select a life partner, etc. At each time step: A secretary* arrives. *I m really sorry, but for this talk the secretaries
More informationDual fitting approximation for Set Cover, and Primal Dual approximation for Set Cover
duality 1 Dual fitting approximation for Set Cover, and Primal Dual approximation for Set Cover Guy Kortsarz duality 2 The set cover problem with uniform costs Input: A universe U and a collection of subsets
More informationSubmodular Secretary Problem and Extensions
Submodular Secretary Problem and Extensions MohammadHossein Bateni MohammadTaghi Hajiaghayi Morteza Zadimoghaddam Abstract Online auction is the essence of many modern markets, particularly networked markets,
More informationA note on semi-online machine covering
A note on semi-online machine covering Tomáš Ebenlendr 1, John Noga 2, Jiří Sgall 1, and Gerhard Woeginger 3 1 Mathematical Institute, AS CR, Žitná 25, CZ-11567 Praha 1, The Czech Republic. Email: ebik,sgall@math.cas.cz.
More informationOnline Packet Buffering
Online Packet Buffering Dissertation zur Erlangung des Doktorgrades der Fakultät für Angewandte Wissenschaften der Albert-Ludwigs-Universität Freiburg im Breisgau Markus Schmidt Freiburg im Breisgau Februar
More informationSecretary Problems. Petropanagiotaki Maria. January MPLA, Algorithms & Complexity 2
January 15 2015 MPLA, Algorithms & Complexity 2 Simplest form of the problem 1 The candidates are totally ordered from best to worst with no ties. 2 The candidates arrive sequentially in random order.
More informationOn Variants of the Matroid Secretary Problem
On Variants of the Matroid Secretary Problem Shayan Oveis Gharan 1 and Jan Vondrák 2 1 Stanford University, Stanford, CA shayan@stanford.edu 2 IBM Almaden Research Center, San Jose, CA jvondrak@us.ibm.com
More informationLecture 11 February 28, Recap of Approximate Complementary Slackness Result
CS 224: Advanced Algorithms Spring 207 Prof Jelani Nelson Lecture February 28, 207 Scribe: Meena Jagadeesan Overview In this lecture, we look at covering LPs A, b, c 0 under the setting where constraints
More information1 The Knapsack Problem
Comp 260: Advanced Algorithms Prof. Lenore Cowen Tufts University, Spring 2018 Scribe: Tom Magerlein 1 Lecture 4: The Knapsack Problem 1 The Knapsack Problem Suppose we are trying to burgle someone s house.
More informationCSE 421 Dynamic Programming
CSE Dynamic Programming Yin Tat Lee Weighted Interval Scheduling Interval Scheduling Job j starts at s(j) and finishes at f j and has weight w j Two jobs compatible if they don t overlap. Goal: find maximum
More informationKnapsack and Scheduling Problems. The Greedy Method
The Greedy Method: Knapsack and Scheduling Problems The Greedy Method 1 Outline and Reading Task Scheduling Fractional Knapsack Problem The Greedy Method 2 Elements of Greedy Strategy An greedy algorithm
More information18.10 Addendum: Arbitrary number of pigeons
18 Resolution 18. Addendum: Arbitrary number of pigeons Razborov s idea is to use a more subtle concept of width of clauses, tailor made for this particular CNF formula. Theorem 18.22 For every m n + 1,
More informationTesting Equality in Communication Graphs
Electronic Colloquium on Computational Complexity, Report No. 86 (2016) Testing Equality in Communication Graphs Noga Alon Klim Efremenko Benny Sudakov Abstract Let G = (V, E) be a connected undirected
More informationA Framework for Automated Competitive Analysis of On-line Scheduling of Firm-Deadline Tasks
A Framework for Automated Competitive Analysis of On-line Scheduling of Firm-Deadline Tasks Krishnendu Chatterjee 1, Andreas Pavlogiannis 1, Alexander Kößler 2, Ulrich Schmid 2 1 IST Austria, 2 TU Wien
More informationOn-line Bin-Stretching. Yossi Azar y Oded Regev z. Abstract. We are given a sequence of items that can be packed into m unit size bins.
On-line Bin-Stretching Yossi Azar y Oded Regev z Abstract We are given a sequence of items that can be packed into m unit size bins. In the classical bin packing problem we x the size of the bins and try
More informationDesigning Competitive Online Algorithms via a Primal-Dual Approach. Niv Buchbinder
Designing Competitive Online Algorithms via a Primal-Dual Approach Niv Buchbinder Designing Competitive Online Algorithms via a Primal-Dual Approach Research Thesis Submitted in Partial Fulfillment of
More informationOn Two Class-Constrained Versions of the Multiple Knapsack Problem
On Two Class-Constrained Versions of the Multiple Knapsack Problem Hadas Shachnai Tami Tamir Department of Computer Science The Technion, Haifa 32000, Israel Abstract We study two variants of the classic
More informationOn Column-restricted and Priority Covering Integer Programs
On Column-restricted and Priority Covering Integer Programs Deeparnab Chakrabarty Elyot Grant Jochen Könemann November 24, 2009 Abstract In a 0,1-covering integer program (CIP), the goal is to pick a minimum
More informationOnline bin packing 24.Januar 2008
Rob van Stee: Approximations- und Online-Algorithmen 1 Online bin packing 24.Januar 2008 Problem definition First Fit and other algorithms The asymptotic performance ratio Weighting functions Lower bounds
More informationMotivating examples Introduction to algorithms Simplex algorithm. On a particular example General algorithm. Duality An application to game theory
Instructor: Shengyu Zhang 1 LP Motivating examples Introduction to algorithms Simplex algorithm On a particular example General algorithm Duality An application to game theory 2 Example 1: profit maximization
More informationComparison-based FIFO Buffer Management in QoS Switches
Comparison-based FIFO Buffer Management in QoS Switches Kamal Al-Bawani 1, Matthias Englert 2, and Matthias Westermann 3 1 Department of Computer Science, RWTH Aachen University, Germany kbawani@cs.rwth-aachen.de
More informationarxiv: v1 [cs.ni] 18 Apr 2017
Zijun Zhang Dept. of Computer Science University of Calgary zijun.zhang@ucalgary.ca Zongpeng Li Dept. of Computer Science University of Calgary zongpeng@ucalgary.ca Chuan Wu Dept. of Computer Science The
More informationWeighted flow time does not admit O(1)-competitive algorithms
Weighted flow time does not admit O(-competitive algorithms Nihil Bansal Ho-Leung Chan Abstract We consider the classic online scheduling problem of minimizing the total weighted flow time on a single
More informationOnline Budgeted Maximum Coverage
Online Budgeted Maximum Coverage Dror Rawitz and Adi Rosén 2 Faculty of Engineering, Bar-Ilan University, Ramat Gan 52900, Israel. dror.rawitz@biu.ac.il 2 CNRS and Université Paris Diderot, France. adiro@liafa.univ-paris-diderot.fr
More informationIntroduction into Vehicle Routing Problems and other basic mixed-integer problems
Introduction into Vehicle Routing Problems and other basic mixed-integer problems Martin Branda Charles University in Prague Faculty of Mathematics and Physics Department of Probability and Mathematical
More informationSection Notes 8. Integer Programming II. Applied Math 121. Week of April 5, expand your knowledge of big M s and logical constraints.
Section Notes 8 Integer Programming II Applied Math 121 Week of April 5, 2010 Goals for the week understand IP relaxations be able to determine the relative strength of formulations understand the branch
More informationOn Online Algorithms with Advice for the k-server Problem
On Online Algorithms with Advice for the k-server Problem Marc P. Renault 1 and Adi Rosén 2 1 LIAFA, Univerité Paris Diderot - Paris 7; and UPMC, mrenault@liafa.jussieu.fr 2 CNRS and Univerité Paris Diderot
More informationChapter 3: Discrete Optimization Integer Programming
Chapter 3: Discrete Optimization Integer Programming Edoardo Amaldi DEIB Politecnico di Milano edoardo.amaldi@polimi.it Sito web: http://home.deib.polimi.it/amaldi/ott-13-14.shtml A.A. 2013-14 Edoardo
More informationarxiv: v2 [cs.ds] 5 Aug 2015
Online Algorithms with Advice for Bin Packing and Scheduling Problems Marc P. Renault a,,2, Adi Rosén a,2, Rob van Stee b arxiv:3.7589v2 [cs.ds] 5 Aug 205 a CNRS and Université Paris Diderot, France b
More informationThe Parking Permit Problem
The Parking Permit Problem Adam Meyerson November 3, 2004 Abstract We consider online problems where purchases have time durations which expire regardless of whether the purchase is used or not. The Parking
More informationVector Bin Packing with Multiple-Choice
Vector Bin Packing with Multiple-Choice Boaz Patt-Shamir Dror Rawitz boaz@eng.tau.ac.il rawitz@eng.tau.ac.il School of Electrical Engineering Tel Aviv University Tel Aviv 69978 Israel June 17, 2010 Abstract
More informationAll-norm Approximation Algorithms
All-norm Approximation Algorithms Yossi Azar Leah Epstein Yossi Richter Gerhard J. Woeginger Abstract A major drawback in optimization problems and in particular in scheduling problems is that for every
More information3.4 Relaxations and bounds
3.4 Relaxations and bounds Consider a generic Discrete Optimization problem z = min{c(x) : x X} with an optimal solution x X. In general, the algorithms generate not only a decreasing sequence of upper
More informationA Primal-Dual Randomized Algorithm for Weighted Paging
A Primal-Dual Randomized Algorithm for Weighted Paging Nikhil Bansal Niv Buchbinder Joseph (Seffi) Naor April 2, 2012 Abstract The study the weighted version of classic online paging problem where there
More informationAlgorithms. NP -Complete Problems. Dong Kyue Kim Hanyang University
Algorithms NP -Complete Problems Dong Kyue Kim Hanyang University dqkim@hanyang.ac.kr The Class P Definition 13.2 Polynomially bounded An algorithm is said to be polynomially bounded if its worst-case
More informationInteger Linear Programming Modeling
DM554/DM545 Linear and Lecture 9 Integer Linear Programming Marco Chiarandini Department of Mathematics & Computer Science University of Southern Denmark Outline 1. 2. Assignment Problem Knapsack Problem
More informationarxiv: v1 [cs.ds] 25 Jan 2015
TSP with Time Windows and Service Time Yossi Azar Adi Vardi August 20, 2018 arxiv:1501.06158v1 [cs.ds] 25 Jan 2015 Abstract We consider TSP with time windows and service time. In this problem we receive
More informationNP-Completeness. NP-Completeness 1
NP-Completeness Reference: Computers and Intractability: A Guide to the Theory of NP-Completeness by Garey and Johnson, W.H. Freeman and Company, 1979. NP-Completeness 1 General Problems, Input Size and
More informationChapter 3: Discrete Optimization Integer Programming
Chapter 3: Discrete Optimization Integer Programming Edoardo Amaldi DEIB Politecnico di Milano edoardo.amaldi@polimi.it Website: http://home.deib.polimi.it/amaldi/opt-16-17.shtml Academic year 2016-17
More informationOn Online Algorithms with Advice for the k-server Problem
On Online Algorithms with Advice for the k-server Problem Marc P. Renault and Adi Rosén 1 LIAFA, Université Paris Diderot - Paris 7 and UPMC, mrenault@liafa.univ-paris-diderot.fr 2 CNRS and Université
More informationON THE COMPLEXITY OF SOLVING THE GENERALIZED SET PACKING PROBLEM APPROXIMATELY. Nimrod Megiddoy
ON THE COMPLEXITY OF SOLVING THE GENERALIZED SET PACKING PROBLEM APPROXIMATELY Nimrod Megiddoy Abstract. The generalized set packing problem (GSP ) is as follows. Given a family F of subsets of M = f mg
More informationComputational Game Theory Spring Semester, 2005/6. Lecturer: Yishay Mansour Scribe: Ilan Cohen, Natan Rubin, Ophir Bleiberg*
Computational Game Theory Spring Semester, 2005/6 Lecture 5: 2-Player Zero Sum Games Lecturer: Yishay Mansour Scribe: Ilan Cohen, Natan Rubin, Ophir Bleiberg* 1 5.1 2-Player Zero Sum Games In this lecture
More informationLecture 13 March 7, 2017
CS 224: Advanced Algorithms Spring 2017 Prof. Jelani Nelson Lecture 13 March 7, 2017 Scribe: Hongyao Ma Today PTAS/FPTAS/FPRAS examples PTAS: knapsack FPTAS: knapsack FPRAS: DNF counting Approximation
More information3.10 Column generation method
3.10 Column generation method Many relevant decision-making (discrete optimization) problems can be formulated as ILP problems with a very large (exponential) number of variables. Examples: cutting stock,
More informationOnline Knapsack Revisited
Online Knapsack Revisited Marek Cygan 1 and Łukasz Jeż 2 1 Institute of Informatics, University of Warsaw, Poland cygan@mimuw.edu.pl 2 Inst. of Computer Science, University of Wrocław (PL), and Dept. of
More informationNew Online Algorithms for Story Scheduling in Web Advertising
New Online Algorithms for Story Scheduling in Web Advertising Susanne Albers TU Munich Achim Paßen HU Berlin Online advertising Worldwide online ad spending 2012/13: $ 100 billion Expected to surpass print
More informationOn-line Scheduling to Minimize Max Flow Time: An Optimal Preemptive Algorithm
On-line Scheduling to Minimize Max Flow Time: An Optimal Preemptive Algorithm Christoph Ambühl and Monaldo Mastrolilli IDSIA Galleria 2, CH-6928 Manno, Switzerland October 22, 2004 Abstract We investigate
More informationACO Comprehensive Exam March 20 and 21, Computability, Complexity and Algorithms
1. Computability, Complexity and Algorithms Part a: You are given a graph G = (V,E) with edge weights w(e) > 0 for e E. You are also given a minimum cost spanning tree (MST) T. For one particular edge
More informationOn-Line Load Balancing
2 On-Line Load Balancing Without proper scheduling and resource allocation, large queues at each processing operation cause an imbalanced production system: some machines are overloaded while some are
More informationChapter 7 Network Flow Problems, I
Chapter 7 Network Flow Problems, I Network flow problems are the most frequently solved linear programming problems. They include as special cases, the assignment, transportation, maximum flow, and shortest
More informationThe Greedy Method. Design and analysis of algorithms Cs The Greedy Method
Design and analysis of algorithms Cs 3400 The Greedy Method 1 Outline and Reading The Greedy Method Technique Fractional Knapsack Problem Task Scheduling 2 The Greedy Method Technique The greedy method
More informationMore on NP and Reductions
Indian Institute of Information Technology Design and Manufacturing, Kancheepuram Chennai 600 127, India An Autonomous Institute under MHRD, Govt of India http://www.iiitdm.ac.in COM 501 Advanced Data
More informationOn a hypergraph matching problem
On a hypergraph matching problem Noga Alon Raphael Yuster Abstract Let H = (V, E) be an r-uniform hypergraph and let F 2 V. A matching M of H is (α, F)- perfect if for each F F, at least α F vertices of
More information1 Introduction and Results
Discussiones Mathematicae Graph Theory 20 (2000 ) 7 79 SOME NEWS ABOUT THE INDEPENDENCE NUMBER OF A GRAPH Jochen Harant Department of Mathematics, Technical University of Ilmenau D-98684 Ilmenau, Germany
More informationLecture 8: Decision-making under total uncertainty: the multiplicative weight algorithm. Lecturer: Sanjeev Arora
princeton univ. F 13 cos 521: Advanced Algorithm Design Lecture 8: Decision-making under total uncertainty: the multiplicative weight algorithm Lecturer: Sanjeev Arora Scribe: (Today s notes below are
More informationLinear and Integer Programming - ideas
Linear and Integer Programming - ideas Paweł Zieliński Institute of Mathematics and Computer Science, Wrocław University of Technology, Poland http://www.im.pwr.wroc.pl/ pziel/ Toulouse, France 2012 Literature
More informationOn-line Scheduling with Hard Deadlines. Subhash Suri x. St. Louis, MO WUCS December Abstract
On-line Scheduling with Hard Deadlines Sally A. Goldman y Washington University St. Louis, MO 63130-4899 sg@cs.wustl.edu Jyoti Parwatikar z Washington University St. Louis, MO 63130-4899 jp@cs.wustl.edu
More informationMVE165/MMG630, Applied Optimization Lecture 6 Integer linear programming: models and applications; complexity. Ann-Brith Strömberg
MVE165/MMG630, Integer linear programming: models and applications; complexity Ann-Brith Strömberg 2011 04 01 Modelling with integer variables (Ch. 13.1) Variables Linear programming (LP) uses continuous
More informationProblem Set 2. Assigned: Mon. November. 23, 2015
Pseudorandomness Prof. Salil Vadhan Problem Set 2 Assigned: Mon. November. 23, 2015 Chi-Ning Chou Index Problem Progress 1 SchwartzZippel lemma 1/1 2 Robustness of the model 1/1 3 Zero error versus 1-sided
More informationOnline Packet Routing on Linear Arrays and Rings
Proc. 28th ICALP, LNCS 2076, pp. 773-784, 2001 Online Packet Routing on Linear Arrays and Rings Jessen T. Havill Department of Mathematics and Computer Science Denison University Granville, OH 43023 USA
More informationALGORITHMS FOR BUDGETED AUCTIONS AND MULTI-AGENT COVERING PROBLEMS
ALGORITHMS FOR BUDGETED AUCTIONS AND MULTI-AGENT COVERING PROBLEMS A Thesis Presented to The Academic Faculty by Gagan Goel In Partial Fulfillment of the Requirements for the Degree Doctor of Philosophy
More information3.10 Column generation method
3.10 Column generation method Many relevant decision-making problems can be formulated as ILP problems with a very large (exponential) number of variables. Examples: cutting stock, crew scheduling, vehicle
More informationApproximation Algorithms for the k-set Packing Problem
Approximation Algorithms for the k-set Packing Problem Marek Cygan Institute of Informatics University of Warsaw 20th October 2016, Warszawa Marek Cygan Approximation Algorithms for the k-set Packing Problem
More informationHypergraph Matching by Linear and Semidefinite Programming. Yves Brise, ETH Zürich, Based on 2010 paper by Chan and Lau
Hypergraph Matching by Linear and Semidefinite Programming Yves Brise, ETH Zürich, 20110329 Based on 2010 paper by Chan and Lau Introduction Vertex set V : V = n Set of hyperedges E Hypergraph matching:
More informationThe concentration of the chromatic number of random graphs
The concentration of the chromatic number of random graphs Noga Alon Michael Krivelevich Abstract We prove that for every constant δ > 0 the chromatic number of the random graph G(n, p) with p = n 1/2
More informationWhat is Dynamic Programming
What is Dynamic Programming Like DaC, Greedy algorithms, Dynamic Programming is another useful method for designing efficient algorithms. Why the name? Eye of the Hurricane: An Autobiography - A quote
More informationApproximating Minimum-Power Degree and Connectivity Problems
Approximating Minimum-Power Degree and Connectivity Problems Guy Kortsarz Vahab S. Mirrokni Zeev Nutov Elena Tsanko Abstract Power optimization is a central issue in wireless network design. Given a graph
More informationAlternatives to competitive analysis Georgios D Amanatidis
Alternatives to competitive analysis Georgios D Amanatidis 1 Introduction Competitive analysis allows us to make strong theoretical statements about the performance of an algorithm without making probabilistic
More informationGraduate Algorithms CS F-02 Probabilistic Analysis
Graduate Algorithms CS673-20016F-02 Probabilistic Analysis David Galles Department of Computer Science University of San Francisco 02-0: Hiring Problem Need an office assistant Employment Agency sends
More informationBin packing with colocations
Bin packing with colocations Jean-Claude Bermond 1, Nathann Cohen, David Coudert 1, Dimitrios Letsios 1, Ioannis Milis 3, Stéphane Pérennes 1, and Vassilis Zissimopoulos 4 1 Université Côte d Azur, INRIA,
More informationCSE 123: Computer Networks
CSE 123: Computer Networks Total points: 40 Homework 1 - Solutions Out: 10/4, Due: 10/11 Solutions 1. Two-dimensional parity Given below is a series of 7 7-bit items of data, with an additional bit each
More information15-451/651: Design & Analysis of Algorithms September 13, 2018 Lecture #6: Streaming Algorithms last changed: August 30, 2018
15-451/651: Design & Analysis of Algorithms September 13, 2018 Lecture #6: Streaming Algorithms last changed: August 30, 2018 Today we ll talk about a topic that is both very old (as far as computer science
More informationCrowd-Sourced Storage-Assisted Demand-Response in Microgrids
Crowd-Sourced Storage-Assisted Demand-Response in Microgrids ABSTRACT Mohammad H. Hajiesmaili Johns Hopkins University hajiesmaili@jhu.edu Enrique Mallada Johns Hopkins University mallada@jhu.edu This
More informationarxiv: v1 [cs.it] 23 Jan 2019
Single-Server Single-Message Online Private Information Retrieval with Side Information Fatemeh azemi, Esmaeil arimi, Anoosheh Heidarzadeh, and Alex Sprintson arxiv:90.07748v [cs.it] 3 Jan 09 Abstract
More informationOnline Appendices: Inventory Control in a Spare Parts Distribution System with Emergency Stocks and Pipeline Information
Online Appendices: Inventory Control in a Spare Parts Distribution System with Emergency Stocks and Pipeline Information Christian Howard christian.howard@vti.se VTI - The Swedish National Road and Transport
More informationAllocating Resources, in the Future
Allocating Resources, in the Future Sid Banerjee School of ORIE May 3, 2018 Simons Workshop on Mathematical and Computational Challenges in Real-Time Decision Making online resource allocation: basic model......
More informationOperations Research Letters. Instability of FIFO in a simple queueing system with arbitrarily low loads
Operations Research Letters 37 (2009) 312 316 Contents lists available at ScienceDirect Operations Research Letters journal homepage: www.elsevier.com/locate/orl Instability of FIFO in a simple queueing
More informationTight Bounds for Online Vector Scheduling
Tight Bounds for Online Vector Scheduling Sungjin Im Nathaniel Kell Janardhan Kularni Debmalya Panigrahi Electrical Engineering and Computer Science, University of California at Merced, Merced, CA, USA.
More informationA Robust APTAS for the Classical Bin Packing Problem
A Robust APTAS for the Classical Bin Packing Problem Leah Epstein 1 and Asaf Levin 2 1 Department of Mathematics, University of Haifa, 31905 Haifa, Israel. Email: lea@math.haifa.ac.il 2 Department of Statistics,
More informationSUM x. 2x y x. x y x/2. (i)
Approximate Majorization and Fair Online Load Balancing Ashish Goel Adam Meyerson y Serge Plotkin z July 7, 2000 Abstract This paper relates the notion of fairness in online routing and load balancing
More informationA 2-Approximation Algorithm for Scheduling Parallel and Time-Sensitive Applications to Maximize Total Accrued Utility Value
A -Approximation Algorithm for Scheduling Parallel and Time-Sensitive Applications to Maximize Total Accrued Utility Value Shuhui Li, Miao Song, Peng-Jun Wan, Shangping Ren Department of Engineering Mechanics,
More informationThe Las-Vegas Processor Identity Problem (How and When to Be Unique)
The Las-Vegas Processor Identity Problem (How and When to Be Unique) Shay Kutten Department of Industrial Engineering The Technion kutten@ie.technion.ac.il Rafail Ostrovsky Bellcore rafail@bellcore.com
More informationCapacity Constrained Assortment Optimization under the Markov Chain based Choice Model
Submitted to Operations Research manuscript (Please, provide the manuscript number!) Capacity Constrained Assortment Optimization under the Markov Chain based Choice Model Antoine Désir Department of Industrial
More informationCenter for Transportation, Environment, and Community Health Final Report. by Juan C. Martínez Mori, Samitha Samaranayake
Redesigning Mass Transit Systems to better integrate with Mobility-on-Demand Systems or Redesigning Mass Transit Systems to better integrate with Mobility-on-Demand Systems via The Batched Set Cover Problem
More informationUsing mixed-integer programming to solve power grid blackout problems
Using mixed-integer programming to solve power grid blackout problems Daniel Bienstock 1 Dept. of IEOR Columbia University New York, NY 10027 Sara Mattia DIS Università La Sapienza Roma October 2005, revised
More information3 Some Generalizations of the Ski Rental Problem
CS 655 Design and Analysis of Algorithms November 6, 27 If It Looks Like the Ski Rental Problem, It Probably Has an e/(e 1)-Competitive Algorithm 1 Introduction In this lecture, we will show that Certain
More informationLecture 20: LP Relaxation and Approximation Algorithms. 1 Introduction. 2 Vertex Cover problem. CSCI-B609: A Theorist s Toolkit, Fall 2016 Nov 8
CSCI-B609: A Theorist s Toolkit, Fall 2016 Nov 8 Lecture 20: LP Relaxation and Approximation Algorithms Lecturer: Yuan Zhou Scribe: Syed Mahbub Hafiz 1 Introduction When variables of constraints of an
More informationLow-Regret for Online Decision-Making
Siddhartha Banerjee and Alberto Vera November 6, 2018 1/17 Introduction Compensated Coupling Bayes Selector Conclusion Motivation 2/17 Introduction Compensated Coupling Bayes Selector Conclusion Motivation
More informationOn Markov Chain Monte Carlo
MCMC 0 On Markov Chain Monte Carlo Yevgeniy Kovchegov Oregon State University MCMC 1 Metropolis-Hastings algorithm. Goal: simulating an Ω-valued random variable distributed according to a given probability
More informationOnline Algorithms for Packing and Covering Problems with Convex Objectives 1
Online Algorithms for Packing and Covering Problems with Convex Objectives Yossi Azar 2 Niv Buchbinder 3 T-H. Hubert Chan 4 Shahar Chen 5 Ilan Reuven Cohen 2 Anupam Gupta 6 Zhiyi Huang 4 Ning Kang 4 Viswanath
More informationOnline Competitive Algorithms for Maximizing Weighted Throughput of Unit Jobs
Online Competitive Algorithms for Maximizing Weighted Throughput of Unit Jobs Yair Bartal 1, Francis Y. L. Chin 2, Marek Chrobak 3, Stanley P. Y. Fung 2, Wojciech Jawor 3, Ron Lavi 1, Jiří Sgall 4, and
More informationInventory optimization of distribution networks with discrete-event processes by vendor-managed policies
Inventory optimization of distribution networks with discrete-event processes by vendor-managed policies Simona Sacone and Silvia Siri Department of Communications, Computer and Systems Science University
More information