ALG 5.4. Lexicographical Search: Applied to Scheduling Theory. Professor John Reif
|
|
- Neal Barton
- 6 years ago
- Views:
Transcription
1 Algorithms Professor John Reif ALG 54 input assume problem Scheduling Problems Set of n tasks in precidence relation on tasks Also, given m processors Unit time cost to process task using single processor Schedule execution of tasks in minimal time, using < m processors per unit time A task can not be executed before its predecessors Lexicographical Search: Applied to Scheduling Theory Reading Selection: "Algorithms for Minimal-length Schedules", R Sethi, Introduction Deterministic Scheduling Theory, Ch, pp 5-73, E Coffman, ed to Scheduling: using 3 processors
2 3 Dag = directed acyclic graph Level Strategy on Dags --Whenever a processor becomes available, assign it to the first unexecuted ready task at the highest level Levels l 4 l 3 4Theorem: Level Strategy Optimal for Forests of Trees Proof: Suppose not Consider a smallest task forest T with non-optimal level strategy S taking time D Then $ idle processor at time D- Hence, $ task q of level l executed at time D- So, no task of level l is executed before time D l Levels 3 4 l l 3 l 0 q l level l i = set of nodes such that $ path length i from node to terminal l Levels computed by reverse Breadth First Search of Dag in linear time! l 0
3 Derive a new task forest T from T: () Delete roots and children of roots 5 (ie delete l 0,l ) () Add a new root connected to all old grandchildren (ie level l ) 6 Scheduling Problem: T But level strategy S or T is length D-, a contradiction with minimality of T T' l k Task System is a Dag G (Note: If G has a cycle, then every task on the cycle is a predecessorof itself, so is not ever executable) l k- l Complexity of Scheduling with m Processors-- m= Processors: polynomial time m=3 Processors: Open! m>3 Processors: NP complete l new root l 0 root time D - D - D D - D - q q idle new root
4 7 Two Processor Scheduling 8 Task System G is Dag (Delete transitive edges in time n 8 ) Requirements of Scheduling Strategy: ()Consistent with level strategy: those tasks closer to root are executed later ()If successors(q) successors(q'), then q always executed before q' Lexicographic Ordering on Strings: ()For any non-empty string w, w>" " ()If w>w', then for any string u, uw>uw' compare them from left to right, choosing the string with first larger character Examples: 5>5 53>5
5 9 Lexicographical INPUT: dag G Search = ( V, E) Initialize: Let S be set of unassigned nodes with no unlabelled successors ( ) = ( ) ( ) For Each vœ S, let r v L Y L Y K i, where Y, K, Y i are successors of v with LY ( ) > LY ( ) > K > LY ( i ) 0 A Linear Time Algorithm for Lexicographical Search of dag G=(V,E) Idea: Do not compute sort of successor lists, instead keep list LEX of their suffix labels, from smallest to largest G H I J D E F 3 A B C l 3 l l Let x be an element of S with min r( x) with respect to Lexicographical order Lx ( ) k k k+ If Then Some vertex is still unlabeled, goto stop Number Q LEX - A= B= C=3 E=4 F=5 D=6 J=7 I=8 G=9 H=0 ABC BC C EFD FD DJI JIGH IGH GH H - - GF GFD G HG GH Example: After labeling E with 4, now label( H) =-4, label( G) =-4 fi LEX = HG
6 Algorithm: Lexicographic Search Input: dag G = ( V, E) Begin: Initialize: Q ( nodes with no successors) LEX ( ) "v ŒV, flag( v) 0 k 0 Loop: Choose and delete first v ŒQ Assign v number k k + for each immediate predecessor v of v do flag( v ) ; Add v' to LEX SUFFIX - LEX ( ); SUFFIX - Q ( ) For If Each v ŒLEX in increasing order such that flag( v ) = do delete ( v,v ) edge; flag( v ) 0 delete v from LEX if v has remaining departing edge: then add v to SUFFIX - LEX else add v to SUFFIX - Q od LEX LEX ( SUFFIX - LEX) ( ) SUFFIX - Q Q Q remaining predecessors of v delete all edges ( v,v ) entering v Q π f, then go to LOOP Application to Task Scheduling Input: Task dag G Compute LEXICOGRAPHIC Search of G Assign tasks by Level Strategy (scheduling highest numbered tasks earliest if they are ready) Theorem: LEXICOGRAPHIC Search yields an optimal scheduling for case of processors Proof: Nontrivial and interesting!
7 3 5 Levels l 7 4 Convention Assign task to processor before processor Let S be scheduled by LEXICOGRAPHIC Search 4 l 6 Follow Sets: F k, F, k-, F 0 D i * * The F i are predecessors of F i- 3 l 5 DominatingTasks: D k, D k+,,d 0 F i - The D i "dominate " the F i- l 4 Jumpahead Tasks: J k, J k+,, J 0 The J i "jump ahead " of F i l 3 -- Both D i and J i are executed at the same time unit l D i F i- D i- J i J i - 3 time processor processor l Define: J i as (possibly idle) task scheduled as late as possible st number ( J i ) < number ( D i - ) time ( J i ) < time ( D i - ) Define: D i as task executed at the same time as J i ; idle Define: F i Ïtasks scheduled strictly before = { Di}» Ì Ó Di and after Di+ ( if Di+ exists)
8 F 3 5 D 3 5 F F 3 4 D Lemma : The D i nodes are always (not necessarily immediate) predecessors of the F i - nodes D J 0 J F 0 3 D 0 7 J 3 Proof: By definition, number ( J i ) < number ( D i - ), and J i is the latest such task with time ( J i ) < time ( D i - ) Thus, number ( J i ) < number ( D i - ) number v for any v ŒFi- - Di- So each element of F i - is numbered larger than J i, but Scheduling attempts to label the highest numbered tasks first, if possible (ie if they are ready) So, no element of F i - could be ready at the time D i is assigned Thus, D i dominates all the F :" v Œ F, $ path from D i to v i- i- ( ) processor F 3 5 F 4 3 F F 0 3 QED processor J 3 J J 0 idle task
9 Lemma3: Proof : All the F i nodes are predecessors of the F i- nodes By Lemma, D i precedes all F i- By definition of F i, number( F i ) > number( D i ) (else F i node is set to J i +, which is not in F i ) By our scheduling algorithm, D i has a higher number than any task executed at a later time Thus, the elements of F i - are the highest numbered tasks executed after D i Then it follows that if Lexicographic Search gives r( D i ) = ( LY ( ), LY ( ),, LY ( j )), then $ prefix Y,Y,,Y j ŒF i - the highest numbered successors of D i which are in F i- (but with no predecessors in F i- ), and thus all the F i nodes are predecessors of nodes Y,Y,,Y j in F i- Q E D 8 Claim: Lexicographic Search Ordering yields optimal scheduling for two processors Proof : By Lemma 3, each v ŒF i must preceed all v ŒF i - in time Since F is always odd, thus, t i = F i + is time required to schedule the tasks of F i Optimal scheduling requires time u Ât i i= which is exactly what Lexographic Search Ordering Algorithm achieves! Q E D
10 9 Given: List L of task ordering 0 L = ( ) ListScheduling : Whenever a processor becomes evaluable, scan the list from left to right Assign to the processor the first unexecuted ready task AlgorithmforListScheduling : Build up the schedule by constructing schedules for increasingly longer prefixes of L = ( n,n-, n-,,,) L = (,) L 6 = (,,3,) schedule L = ( n) schedule L = ( n, n- ) idle idle idle L 8 = (,,0) schedule L n = ( n,n-,,,)= L L 9 = (,,9) 9 arrows give st time $ free processor
11 Ê Almost LinearTimeO Ánlogn * ˆ Ë AlgorithmforListScheduling t'œ SET() t iff t' is the st time at, or after time t s t Begin $ a free processor initialize : forall times t, do SET()= t {} t for all tasks x with no predecessors do ready time( x) for each task x in decreasing order do begin t FIND( ready time( x) ) assign x to time t ift has no more free processors for thenmerge SETt () with SETt ( + ) each immediate successor Y to x st all predecessors of Y are visited do ready timey ( ) t + end Output ready time ( ),,ready time ( ) Task Systemwithm 3 processors If t= time used by Lex schedule t 0 = optimal schedule time t t0 - m
Partition is reducible to P2 C max. c. P2 Pj = 1, prec Cmax is solvable in polynomial time. P Pj = 1, prec Cmax is NP-hard
I. Minimizing Cmax (Nonpreemptive) a. P2 C max is NP-hard. Partition is reducible to P2 C max b. P Pj = 1, intree Cmax P Pj = 1, outtree Cmax are both solvable in polynomial time. c. P2 Pj = 1, prec Cmax
More informationEmbedded Systems 15. REVIEW: Aperiodic scheduling. C i J i 0 a i s i f i d i
Embedded Systems 15-1 - REVIEW: Aperiodic scheduling C i J i 0 a i s i f i d i Given: A set of non-periodic tasks {J 1,, J n } with arrival times a i, deadlines d i, computation times C i precedence constraints
More informationTrees. A tree is a graph which is. (a) Connected and. (b) has no cycles (acyclic).
Trees A tree is a graph which is (a) Connected and (b) has no cycles (acyclic). 1 Lemma 1 Let the components of G be C 1, C 2,..., C r, Suppose e = (u, v) / E, u C i, v C j. (a) i = j ω(g + e) = ω(g).
More informationAPTAS for Bin Packing
APTAS for Bin Packing Bin Packing has an asymptotic PTAS (APTAS) [de la Vega and Leuker, 1980] For every fixed ε > 0 algorithm outputs a solution of size (1+ε)OPT + 1 in time polynomial in n APTAS for
More informationTwo Processor Scheduling with Real Release Times and Deadlines
Two Processor Scheduling with Real Release Times and Deadlines Hui Wu School of Computing National University of Singapore 3 Science Drive 2, Singapore 117543 wuh@comp.nus.edu.sg Joxan Jaffar School of
More informationBreadth-First Search of Graphs
Breadth-First Search of Graphs Analysis of Algorithms Prepared by John Reif, Ph.D. Distinguished Professor of Computer Science Duke University Applications of Breadth-First Search of Graphs a) Single Source
More information2 GRAPH AND NETWORK OPTIMIZATION. E. Amaldi Introduction to Operations Research Politecnico Milano 1
2 GRAPH AND NETWORK OPTIMIZATION E. Amaldi Introduction to Operations Research Politecnico Milano 1 A variety of decision-making problems can be formulated in terms of graphs and networks Examples: - transportation
More informationCSE101: Design and Analysis of Algorithms. Ragesh Jaiswal, CSE, UCSD
Course Overview Material that will be covered in the course: Basic graph algorithms Algorithm Design Techniques Greedy Algorithms Divide and Conquer Dynamic Programming Network Flows Computational intractability
More informationALG 4.3. Hashing Polynomials and Algebraic Expressions: Main Goal of Lecture: Algorithms Professor John Reif
Algorithms Professor John Reif ALG 4.3 Hashing Polynomials and Algebraic Expressions: (a) Identity Testing of Polynomials (b) Applications of Polynomial Hashing (c) Hashing Classes of Algebraic Expressions
More informationAlgorithm Design. Scheduling Algorithms. Part 2. Parallel machines. Open-shop Scheduling. Job-shop Scheduling.
Algorithm Design Scheduling Algorithms Part 2 Parallel machines. Open-shop Scheduling. Job-shop Scheduling. 1 Parallel Machines n jobs need to be scheduled on m machines, M 1,M 2,,M m. Each machine can
More information1 Ordinary Load Balancing
Comp 260: Advanced Algorithms Prof. Lenore Cowen Tufts University, Spring 208 Scribe: Emily Davis Lecture 8: Scheduling Ordinary Load Balancing Suppose we have a set of jobs each with their own finite
More informationEmbedded Systems - FS 2018
Institut für Technische Informatik und Kommunikationsnetze Prof. L. Thiele Embedded Systems - FS 2018 Sample solution to Exercise 3 Discussion Date: 11.4.2018 Aperiodic Scheduling Task 1: Earliest Deadline
More informationGraph G = (V, E). V ={vertices}, E={edges}. V={a,b,c,d,e,f,g,h,k} E={(a,b),(a,g),( a,h),(a,k),(b,c),(b,k),...,(h,k)}
Graph Theory Graph G = (V, E). V ={vertices}, E={edges}. a b c h k d g f e V={a,b,c,d,e,f,g,h,k} E={(a,b),(a,g),( a,h),(a,k),(b,c),(b,k),...,(h,k)} E =16. Digraph D = (V, A). V ={vertices}, E={edges}.
More informationComplexity Theory VU , SS The Polynomial Hierarchy. Reinhard Pichler
Complexity Theory Complexity Theory VU 181.142, SS 2018 6. The Polynomial Hierarchy Reinhard Pichler Institut für Informationssysteme Arbeitsbereich DBAI Technische Universität Wien 15 May, 2018 Reinhard
More informationOutline. Complexity Theory EXACT TSP. The Class DP. Definition. Problem EXACT TSP. Complexity of EXACT TSP. Proposition VU 181.
Complexity Theory Complexity Theory Outline Complexity Theory VU 181.142, SS 2018 6. The Polynomial Hierarchy Reinhard Pichler Institut für Informationssysteme Arbeitsbereich DBAI Technische Universität
More informationEECS 571 Principles of Real-Time Embedded Systems. Lecture Note #7: More on Uniprocessor Scheduling
EECS 571 Principles of Real-Time Embedded Systems Lecture Note #7: More on Uniprocessor Scheduling Kang G. Shin EECS Department University of Michigan Precedence and Exclusion Constraints Thus far, we
More informationChapter 3 Deterministic planning
Chapter 3 Deterministic planning In this chapter we describe a number of algorithms for solving the historically most important and most basic type of planning problem. Two rather strong simplifying assumptions
More informationFinite Automata. Warren McCulloch ( ) and Walter Pitts ( )
2 C H A P T E R Finite Automata Warren McCulloch (898 968) and Walter Pitts (923 969) Warren S. McCulloch was an American psychiatrist and neurophysiologist who co-founded Cybernetics. His greatest contributions
More informationEmbedded Systems 14. Overview of embedded systems design
Embedded Systems 14-1 - Overview of embedded systems design - 2-1 Point of departure: Scheduling general IT systems In general IT systems, not much is known about the computational processes a priori The
More informationdirected weighted graphs as flow networks the Ford-Fulkerson algorithm termination and running time
Network Flow 1 The Maximum-Flow Problem directed weighted graphs as flow networks the Ford-Fulkerson algorithm termination and running time 2 Maximum Flows and Minimum Cuts flows and cuts max flow equals
More informationLecture 2: Scheduling on Parallel Machines
Lecture 2: Scheduling on Parallel Machines Loris Marchal October 17, 2012 Parallel environment alpha in Graham s notation): P parallel identical Q uniform machines: each machine has a given speed speed
More informationOn Machine Dependency in Shop Scheduling
On Machine Dependency in Shop Scheduling Evgeny Shchepin Nodari Vakhania Abstract One of the main restrictions in scheduling problems are the machine (resource) restrictions: each machine can perform at
More informationPairing Transitive Closure and Reduction to Efficiently Reason about Partially Ordered Events
Pairing Transitive Closure and Reduction to Efficiently Reason about Partially Ordered Events Massimo Franceschet Angelo Montanari Dipartimento di Matematica e Informatica, Università di Udine Via delle
More informationPairing Transitive Closure and Reduction to Efficiently Reason about Partially Ordered Events
Pairing Transitive Closure and Reduction to Efficiently Reason about Partially Ordered Events Massimo Franceschet Angelo Montanari Dipartimento di Matematica e Informatica, Università di Udine Via delle
More informationParallel Pipelined Filter Ordering with Precedence Constraints
Parallel Pipelined Filter Ordering with Precedence Constraints Amol Deshpande #, Lisa Hellerstein 2 # University of Maryland, College Park, MD USA amol@cs.umd.edu Polytechnic Institute of NYU, Brooklyn,
More informationDeterministic planning
Chapter 3 Deterministic planning The simplest planning problems involves finding a sequence of actions that lead from a given initial state to a goal state. Only deterministic actions are considered. Determinism
More informationAverage-Case Performance Analysis of Online Non-clairvoyant Scheduling of Parallel Tasks with Precedence Constraints
Average-Case Performance Analysis of Online Non-clairvoyant Scheduling of Parallel Tasks with Precedence Constraints Keqin Li Department of Computer Science State University of New York New Paltz, New
More informationKruskal s Theorem Rebecca Robinson May 29, 2007
Kruskal s Theorem Rebecca Robinson May 29, 2007 Kruskal s Theorem Rebecca Robinson 1 Quasi-ordered set A set Q together with a relation is quasi-ordered if is: reflexive (a a); and transitive (a b c a
More informationAdvanced Automata Theory 7 Automatic Functions
Advanced Automata Theory 7 Automatic Functions Frank Stephan Department of Computer Science Department of Mathematics National University of Singapore fstephan@comp.nus.edu.sg Advanced Automata Theory
More informationMassachusetts Institute of Technology 6.042J/18.062J, Fall 02: Mathematics for Computer Science Professor Albert Meyer and Dr.
Massachusetts Institute of Technology 6.042J/18.062J, Fall 02: Mathematics for Computer Science Professor Albert Meyer and Dr. Radhika Nagpal Quiz 1 Appendix Appendix Contents 1 Induction 2 2 Relations
More informationIdeal preemptive schedules on two processors
Acta Informatica 39, 597 612 (2003) Digital Object Identifier (DOI) 10.1007/s00236-003-0119-6 c Springer-Verlag 2003 Ideal preemptive schedules on two processors E.G. Coffman, Jr. 1, J. Sethuraman 2,,
More informationSpace-Efficient Construction Algorithm for Circular Suffix Tree
Space-Efficient Construction Algorithm for Circular Suffix Tree Wing-Kai Hon, Tsung-Han Ku, Rahul Shah and Sharma Thankachan CPM2013 1 Outline Preliminaries and Motivation Circular Suffix Tree Our Indexes
More informationGraph Transformations T1 and T2
Graph Transformations T1 and T2 We now introduce two graph transformations T1 and T2. Reducibility by successive application of these two transformations is equivalent to reducibility by intervals. The
More information{a, b, c} {a, b} {a, c} {b, c} {a}
Section 4.3 Order Relations A binary relation is an partial order if it transitive and antisymmetric. If R is a partial order over the set S, we also say, S is a partially ordered set or S is a poset.
More informationDiscrete Mathematics, Spring 2004 Homework 9 Sample Solutions
Discrete Mathematics, Spring 00 Homework 9 Sample Solutions. #3. A vertex v in a tree T is a center for T if the eccentricity of v is minimal; that is, if the maximum length of a simple path starting from
More informationAnalysis of Algorithms. Outline. Single Source Shortest Path. Andres Mendez-Vazquez. November 9, Notes. Notes
Analysis of Algorithms Single Source Shortest Path Andres Mendez-Vazquez November 9, 01 1 / 108 Outline 1 Introduction Introduction and Similar Problems General Results Optimal Substructure Properties
More informationMATH 22 HAMILTONIAN GRAPHS. Lecture V: 11/18/2003
MATH 22 Lecture V: 11/18/2003 HAMILTONIAN GRAPHS All communities [graphs] divide themselves into the few and the many [i.e., are bipartite]. Alexander Hamilton, Debates of the Federal Convention Before
More informationDecision Problems with TM s. Lecture 31: Halting Problem. Universe of discourse. Semi-decidable. Look at following sets: CSCI 81 Spring, 2012
Decision Problems with TM s Look at following sets: Lecture 31: Halting Problem CSCI 81 Spring, 2012 Kim Bruce A TM = { M,w M is a TM and w L(M)} H TM = { M,w M is a TM which halts on input w} TOTAL TM
More informationA Dynamic Programming algorithm for minimizing total cost of duplication in scheduling an outtree with communication delays and duplication
A Dynamic Programming algorithm for minimizing total cost of duplication in scheduling an outtree with communication delays and duplication Claire Hanen Laboratory LIP6 4, place Jussieu F-75 252 Paris
More informationp 3 p 2 p 4 q 2 q 7 q 1 q 3 q 6 q 5
Discrete Fréchet distance Consider Professor Bille going for a walk with his personal dog. The professor follows a path of points p 1,..., p n and the dog follows a path of points q 1,..., q m. We assume
More informationCSE 421 Greedy Algorithms / Interval Scheduling
CSE 421 Greedy Algorithms / Interval Scheduling Yin Tat Lee 1 Interval Scheduling Job j starts at s(j) and finishes at f(j). Two jobs compatible if they don t overlap. Goal: find maximum subset of mutually
More informationCMSC 451: Lecture 7 Greedy Algorithms for Scheduling Tuesday, Sep 19, 2017
CMSC CMSC : Lecture Greedy Algorithms for Scheduling Tuesday, Sep 9, 0 Reading: Sects.. and. of KT. (Not covered in DPV.) Interval Scheduling: We continue our discussion of greedy algorithms with a number
More informationDesign and Analysis of Algorithms
CSE 0, Winter 08 Design and Analysis of Algorithms Lecture 8: Consolidation # (DP, Greed, NP-C, Flow) Class URL: http://vlsicad.ucsd.edu/courses/cse0-w8/ Followup on IGO, Annealing Iterative Global Optimization
More informationDeterministic Scheduling. Dr inż. Krzysztof Giaro Gdańsk University of Technology
Deterministic Scheduling Dr inż. Krzysztof Giaro Gdańsk University of Technology Lecture Plan Introduction to deterministic scheduling Critical path metod Some discrete optimization problems Scheduling
More informationFINAL EXAM PRACTICE PROBLEMS CMSC 451 (Spring 2016)
FINAL EXAM PRACTICE PROBLEMS CMSC 451 (Spring 2016) The final exam will be on Thursday, May 12, from 8:00 10:00 am, at our regular class location (CSI 2117). It will be closed-book and closed-notes, except
More information10.4 The Kruskal Katona theorem
104 The Krusal Katona theorem 141 Example 1013 (Maximum weight traveling salesman problem We are given a complete directed graph with non-negative weights on edges, and we must find a maximum weight Hamiltonian
More informationSearch and Lookahead. Bernhard Nebel, Julien Hué, and Stefan Wölfl. June 4/6, 2012
Search and Lookahead Bernhard Nebel, Julien Hué, and Stefan Wölfl Albert-Ludwigs-Universität Freiburg June 4/6, 2012 Search and Lookahead Enforcing consistency is one way of solving constraint networks:
More informationAlgorithm Design and Analysis
Algorithm Design and Analysis LECTURE 6 Greedy Algorithms Interval Scheduling Interval Partitioning Scheduling to Minimize Lateness Sofya Raskhodnikova S. Raskhodnikova; based on slides by E. Demaine,
More informationImplementations of 3 Types of the Schreier-Sims Algorithm
Implementations of 3 Types of the Schreier-Sims Algorithm Martin Jaggi m.jaggi@gmx.net MAS334 - Mathematics Computing Project Under supervison of Dr L.H.Soicher Queen Mary University of London March 2005
More informationLecture 2. 1 More N P-Compete Languages. Notes on Complexity Theory: Fall 2005 Last updated: September, Jonathan Katz
Notes on Complexity Theory: Fall 2005 Last updated: September, 2005 Jonathan Katz Lecture 2 1 More N P-Compete Languages It will be nice to find more natural N P-complete languages. To that end, we ine
More informationSOLUTION: SOLUTION: SOLUTION:
Convert R and S into nondeterministic finite automata N1 and N2. Given a string s, if we know the states N1 and N2 may reach when s[1...i] has been read, we are able to derive the states N1 and N2 may
More informationSection Summary. Relations and Functions Properties of Relations. Combining Relations
Chapter 9 Chapter Summary Relations and Their Properties n-ary Relations and Their Applications (not currently included in overheads) Representing Relations Closures of Relations (not currently included
More informationOn improving matchings in trees, via bounded-length augmentations 1
On improving matchings in trees, via bounded-length augmentations 1 Julien Bensmail a, Valentin Garnero a, Nicolas Nisse a a Université Côte d Azur, CNRS, Inria, I3S, France Abstract Due to a classical
More informationAutomata & languages. A primer on the Theory of Computation. Laurent Vanbever. ETH Zürich (D-ITET) September,
Automata & languages A primer on the Theory of Computation Laurent Vanbever www.vanbever.eu ETH Zürich (D-ITET) September, 28 2017 Part 2 out of 5 Last week was all about Deterministic Finite Automaton
More informationGreedy Algorithms. CSE 101: Design and Analysis of Algorithms Lecture 10
Greedy Algorithms CSE 101: Design and Analysis of Algorithms Lecture 10 CSE 101: Design and analysis of algorithms Greedy algorithms Reading: Kleinberg and Tardos, sections 4.1, 4.2, and 4.3 Homework 4
More informationNATIONAL UNIVERSITY OF SINGAPORE CS3230 DESIGN AND ANALYSIS OF ALGORITHMS SEMESTER II: Time Allowed 2 Hours
NATIONAL UNIVERSITY OF SINGAPORE CS3230 DESIGN AND ANALYSIS OF ALGORITHMS SEMESTER II: 2017 2018 Time Allowed 2 Hours INSTRUCTIONS TO STUDENTS 1. This assessment consists of Eight (8) questions and comprises
More informationInformation Theory and Statistics Lecture 2: Source coding
Information Theory and Statistics Lecture 2: Source coding Łukasz Dębowski ldebowsk@ipipan.waw.pl Ph. D. Programme 2013/2014 Injections and codes Definition (injection) Function f is called an injection
More informationTheoretical Computer Science
Theoretical Computer Science 410 (2009) 2759 2766 Contents lists available at ScienceDirect Theoretical Computer Science journal homepage: www.elsevier.com/locate/tcs Note Computing the longest topological
More informationUniversity of Toronto Department of Electrical and Computer Engineering. Final Examination. ECE 345 Algorithms and Data Structures Fall 2016
University of Toronto Department of Electrical and Computer Engineering Final Examination ECE 345 Algorithms and Data Structures Fall 2016 Print your first name, last name, UTORid, and student number neatly
More informationComputational Intractability 2010/4/15. Lecture 2
Computational Intractability 2010/4/15 Professor: David Avis Lecture 2 Scribe:Naoki Hatta 1 P and NP 1.1 Definition of P and NP Decision problem it requires yes/no answer. Example: X is a set of strings.
More informationDiscrete Wiskunde II. Lecture 5: Shortest Paths & Spanning Trees
, 2009 Lecture 5: Shortest Paths & Spanning Trees University of Twente m.uetz@utwente.nl wwwhome.math.utwente.nl/~uetzm/dw/ Shortest Path Problem "#$%&'%()*%"()$#+,&- Given directed "#$%&'()*+,%+('-*.#/'01234564'.*,'7+"-%/8',&'5"4'84%#3
More informationNP-Completeness. Until now we have been designing algorithms for specific problems
NP-Completeness 1 Introduction Until now we have been designing algorithms for specific problems We have seen running times O(log n), O(n), O(n log n), O(n 2 ), O(n 3 )... We have also discussed lower
More information15.1 Matching, Components, and Edge cover (Collaborate with Xin Yu)
15.1 Matching, Components, and Edge cover (Collaborate with Xin Yu) First show l = c by proving l c and c l. For a maximum matching M in G, let V be the set of vertices covered by M. Since any vertex in
More informationGenerating Permutations and Combinations
Generating Permutations and Combinations March 0, 005 Generating Permutations We have learned that there are n! permutations of {,,, n} It is important in many instances to generate a list of such permutations
More informationCSE 417. Chapter 4: Greedy Algorithms. Many Slides by Kevin Wayne. Copyright 2005 Pearson-Addison Wesley. All rights reserved.
CSE 417 Chapter 4: Greedy Algorithms Many Slides by Kevin Wayne. Copyright 2005 Pearson-Addison Wesley. All rights reserved. 1 Greed is good. Greed is right. Greed works. Greed clarifies, cuts through,
More informationCS 4407 Algorithms Lecture: Shortest Path Algorithms
CS 440 Algorithms Lecture: Shortest Path Algorithms Prof. Gregory Provan Department of Computer Science University College Cork 1 Outline Shortest Path Problem General Lemmas and Theorems. Algorithms Bellman-Ford
More informationChapter 11. Approximation Algorithms. Slides by Kevin Wayne Pearson-Addison Wesley. All rights reserved.
Chapter 11 Approximation Algorithms Slides by Kevin Wayne. Copyright @ 2005 Pearson-Addison Wesley. All rights reserved. 1 Approximation Algorithms Q. Suppose I need to solve an NP-hard problem. What should
More informationCS 161: Design and Analysis of Algorithms
CS 161: Design and Analysis of Algorithms Greedy Algorithms 3: Minimum Spanning Trees/Scheduling Disjoint Sets, continued Analysis of Kruskal s Algorithm Interval Scheduling Disjoint Sets, Continued Each
More informationMaximum Flow. Reading: CLRS Chapter 26. CSE 6331 Algorithms Steve Lai
Maximum Flow Reading: CLRS Chapter 26. CSE 6331 Algorithms Steve Lai Flow Network A low network G ( V, E) is a directed graph with a source node sv, a sink node tv, a capacity unction c. Each edge ( u,
More informationContext-Free Languages
CS:4330 Theory of Computation Spring 2018 Context-Free Languages Non-Context-Free Languages Haniel Barbosa Readings for this lecture Chapter 2 of [Sipser 1996], 3rd edition. Section 2.3. Proving context-freeness
More informationFriday Four Square! Today at 4:15PM, Outside Gates
P and NP Friday Four Square! Today at 4:15PM, Outside Gates Recap from Last Time Regular Languages DCFLs CFLs Efficiently Decidable Languages R Undecidable Languages Time Complexity A step of a Turing
More informationFault-Tolerant Consensus
Fault-Tolerant Consensus CS556 - Panagiota Fatourou 1 Assumptions Consensus Denote by f the maximum number of processes that may fail. We call the system f-resilient Description of the Problem Each process
More informationThe Reduction of Graph Families Closed under Contraction
The Reduction of Graph Families Closed under Contraction Paul A. Catlin, Department of Mathematics Wayne State University, Detroit MI 48202 November 24, 2004 Abstract Let S be a family of graphs. Suppose
More informationGenerating p-extremal graphs
Generating p-extremal graphs Derrick Stolee Department of Mathematics Department of Computer Science University of Nebraska Lincoln s-dstolee1@math.unl.edu August 2, 2011 Abstract Let f(n, p be the maximum
More informationDefinition: A binary relation R from a set A to a set B is a subset R A B. Example:
Chapter 9 1 Binary Relations Definition: A binary relation R from a set A to a set B is a subset R A B. Example: Let A = {0,1,2} and B = {a,b} {(0, a), (0, b), (1,a), (2, b)} is a relation from A to B.
More informationRecall: Matchings. Examples. K n,m, K n, Petersen graph, Q k ; graphs without perfect matching
Recall: Matchings A matching is a set of (non-loop) edges with no shared endpoints. The vertices incident to an edge of a matching M are saturated by M, the others are unsaturated. A perfect matching of
More informationα-acyclic Joins Jef Wijsen May 4, 2017
α-acyclic Joins Jef Wijsen May 4, 2017 1 Motivation Joins in a Distributed Environment Assume the following relations. 1 M[NN, Field of Study, Year] stores data about students of UMONS. For example, (19950423158,
More informationChapter 11. Approximation Algorithms. Slides by Kevin Wayne Pearson-Addison Wesley. All rights reserved.
Chapter 11 Approximation Algorithms Slides by Kevin Wayne. Copyright @ 2005 Pearson-Addison Wesley. All rights reserved. 1 P and NP P: The family of problems that can be solved quickly in polynomial time.
More informationSPT is Optimally Competitive for Uniprocessor Flow
SPT is Optimally Competitive for Uniprocessor Flow David P. Bunde Abstract We show that the Shortest Processing Time (SPT) algorithm is ( + 1)/2-competitive for nonpreemptive uniprocessor total flow time
More informationAlgorithm Design Strategies V
Algorithm Design Strategies V Joaquim Madeira Version 0.0 October 2016 U. Aveiro, October 2016 1 Overview The 0-1 Knapsack Problem Revisited The Fractional Knapsack Problem Greedy Algorithms Example Coin
More informationFinding Consensus Strings With Small Length Difference Between Input and Solution Strings
Finding Consensus Strings With Small Length Difference Between Input and Solution Strings Markus L. Schmid Trier University, Fachbereich IV Abteilung Informatikwissenschaften, D-54286 Trier, Germany, MSchmid@uni-trier.de
More informationFailure Diagnosis of Discrete Event Systems With Linear-Time Temporal Logic Specifications
Failure Diagnosis of Discrete Event Systems With Linear-Time Temporal Logic Specifications Shengbing Jiang and Ratnesh Kumar Abstract The paper studies failure diagnosis of discrete event systems with
More informationCS5371 Theory of Computation. Lecture 18: Complexity III (Two Classes: P and NP)
CS5371 Theory of Computation Lecture 18: Complexity III (Two Classes: P and NP) Objectives Define what is the class P Examples of languages in P Define what is the class NP Examples of languages in NP
More informationBranch-and-Bound for the Travelling Salesman Problem
Branch-and-Bound for the Travelling Salesman Problem Leo Liberti LIX, École Polytechnique, F-91128 Palaiseau, France Email:liberti@lix.polytechnique.fr March 15, 2011 Contents 1 The setting 1 1.1 Graphs...............................................
More informationCMPS 6610 Fall 2018 Shortest Paths Carola Wenk
CMPS 6610 Fall 018 Shortest Paths Carola Wenk Slides courtesy of Charles Leiserson with changes and additions by Carola Wenk Paths in graphs Consider a digraph G = (V, E) with an edge-weight function w
More informationContents college 5 and 6 Branch and Bound; Beam Search (Chapter , book)! general introduction
Contents college 5 and 6 Branch and Bound; Beam Search (Chapter 3.4-3.5, book)! general introduction Job Shop Scheduling (Chapter 5.1-5.3, book) ffl branch and bound (5.2) ffl shifting bottleneck heuristic
More informationCSCE 551 Final Exam, Spring 2004 Answer Key
CSCE 551 Final Exam, Spring 2004 Answer Key 1. (10 points) Using any method you like (including intuition), give the unique minimal DFA equivalent to the following NFA: 0 1 2 0 5 1 3 4 If your answer is
More informationDistributed Systems Byzantine Agreement
Distributed Systems Byzantine Agreement He Sun School of Informatics University of Edinburgh Outline Finish EIG algorithm for Byzantine agreement. Number-of-processors lower bound for Byzantine agreement.
More informationThis lecture covers Chapter 6 of HMU: Pushdown Automata
This lecture covers Chapter 6 of HMU: ushdown Automata ushdown Automata (DA) Language accepted by a DA Equivalence of CFs and the languages accepted by DAs Deterministic DAs Additional Reading: Chapter
More informationACO Comprehensive Exam 19 March Graph Theory
1. Graph Theory Let G be a connected simple graph that is not a cycle and is not complete. Prove that there exist distinct non-adjacent vertices u, v V (G) such that the graph obtained from G by deleting
More informationCMPSCI611: The Matroid Theorem Lecture 5
CMPSCI611: The Matroid Theorem Lecture 5 We first review our definitions: A subset system is a set E together with a set of subsets of E, called I, such that I is closed under inclusion. This means that
More informationCS60007 Algorithm Design and Analysis 2018 Assignment 1
CS60007 Algorithm Design and Analysis 2018 Assignment 1 Palash Dey and Swagato Sanyal Indian Institute of Technology, Kharagpur Please submit the solutions of the problems 6, 11, 12 and 13 (written in
More informationAlgorithms Exam TIN093 /DIT602
Algorithms Exam TIN093 /DIT602 Course: Algorithms Course code: TIN 093, TIN 092 (CTH), DIT 602 (GU) Date, time: 21st October 2017, 14:00 18:00 Building: SBM Responsible teacher: Peter Damaschke, Tel. 5405
More informationCS 4700: Foundations of Artificial Intelligence Homework 2 Solutions. Graph. You can get to the same single state through multiple paths.
CS 4700: Foundations of Artificial Intelligence Homework Solutions 1. (30 points) Imagine you have a state space where a state is represented by a tuple of three positive integers (i,j,k), and you have
More informationPart V. Matchings. Matching. 19 Augmenting Paths for Matchings. 18 Bipartite Matching via Flows
Matching Input: undirected graph G = (V, E). M E is a matching if each node appears in at most one Part V edge in M. Maximum Matching: find a matching of maximum cardinality Matchings Ernst Mayr, Harald
More informationComplexity Theory Part II
Complexity Theory Part II Time Complexity The time complexity of a TM M is a function denoting the worst-case number of steps M takes on any input of length n. By convention, n denotes the length of the
More informationAlgorithms and Data Structures 2016 Week 5 solutions (Tues 9th - Fri 12th February)
Algorithms and Data Structures 016 Week 5 solutions (Tues 9th - Fri 1th February) 1. Draw the decision tree (under the assumption of all-distinct inputs) Quicksort for n = 3. answer: (of course you should
More informationCoin Changing: Give change using the least number of coins. Greedy Method (Chapter 10.1) Attempt to construct an optimal solution in stages.
IV-0 Definitions Optimization Problem: Given an Optimization Function and a set of constraints, find an optimal solution. Optimal Solution: A feasible solution for which the optimization function has the
More informationAverage case Complexity
February 2, 2015 introduction So far we only studied the complexity of algorithms that solve computational task on every possible input; that is, worst-case complexity. introduction So far we only studied
More informationApproximation Algorithms for scheduling
Approximation Algorithms for scheduling Ahmed Abu Safia I.D.:119936343, McGill University, 2004 (COMP 760) Approximation Algorithms for scheduling Leslie A. Hall The first Chapter of the book entitled
More information