Lectures on NP-hard problems and Approximation algorithms COMP 523: Advanced Algorithmic Techniques Lecturer: Dariusz Kowalski NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Overview Previous lectures: Greedy algorithms Dynamic programming Network flows These lectures: NP-hard problems Approximation algorithms NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms P versus NP Decision problem: problem for which the answer must be either YES or NO Polynomial time algorithm: there is a constant c such that the algorithm solves the problem in time O(nc) for every input of size n P (polynomial time) - class of decision problems for which there is a polynomial time deterministic algorithm solving the problem NP (nondeterministic polynomial time) - class of decision problems for which there is a certifier which can check a witness in polynomial time NP-hard problems and Approximation algorithms

Certifying in polynomial time Representation of decision problem: set of inputs which are correct (and should be answered YES, while others should be answered NO) An efficient certifier B for problem X: B is in P s is in X iff B(s,t) = YES for some t of size polynomial in s Example: Problem: is there a clique of size k in a given graph with n nodes? Certifier: if a given graph has a clique of size k then given this clique as the second parameter we can answer YES NP-hard problems and Approximation algorithms

Computing an efficient certifier How to compute witnesses for an efficient certifier for a given problem? Fact: If the witnesses for the efficient certifier can be found in polynomial time then the problem is in P. Conclusion: P is included in NP Open question: P = NP ? NP-hard problems and Approximation algorithms

Polynomial reductions Example: decision problem if there exists a perfect matching in a bipartite graph can be reduced to network flow problem in polynomial time (by adding source, target and directing the edges) Other problems for undirected graphs (in NP and not known to be in P): Independent Set of nodes Vertex cover Set Cover NP-hard problems and Approximation algorithms

Polynomial reductions Definition: Problem X is polynomial-time reducible to problem Y, or problem Y is at least as hard as problem X, iff problem X can be solved by an algorithm which works in polynomial time and uses polynomial number of calls to the black box solving problem Y. Notation: X P Y Transitivity Property: if X P Y and Y P Z then X P Z NP-hard problems and Approximation algorithms

Independent Set to Vertex Cover Independent Set: given a graph G of n nodes and parameter k, is there a set of k nodes such that none two of them are connected by an edge? Vertex Cover: given a graph G of n nodes and parameter k, is there a set of k nodes such that every edge has at least one end selected? Polynomial Reduction: Solve Vertex-Cover(n-k) for the same graph Proof: Set S of size n - k is a vertex cover set in G iff There is no edge between remaining k nodes iff Set of k remaining nodes is independent in G NP-hard problems and Approximation algorithms

Vertex Cover to Set Cover Vertex Cover: given a graph G of n nodes and parameter k, is there a set of k nodes such that every edge has at least one end among selected nodes? Set Cover: given n nodes, m sets which cover the set of nodes, and parameter k, is there a family of k sets that covers all n nodes? Polynomial Reduction: Let each edge from the graph correspond to the node for SC system For each vertex in the graph create a set of incident edges to SC system Solve Set-Cover(m,n,k) for the created SC system with m nodes and n sets Proof: Each node-edge is covered by at least one set-vertex since each node is covered. This covering is minimal. NP-hard problems and Approximation algorithms

NP-completeness and NP-hardness NP-complete: class of problems X such that every problem from NP is polynomial-time reducible to X. Optimization problems: problems where the answer is a number (maximum/minimum possible) Each optimization problem has its decision version, e.g., Find a maximum Independent Set Is there an Independent Set of size k? NP-hard: class of optimization problems X such that its decision version is NP-complete. Example: having solution for decision version of Independent Set problem, we can probe a parameter k, starting from k = 1 , to find the size of the maximum independent set NP-hard problems and Approximation algorithms

Approximation algorithms Having an NP-hard problem, we do not know at this moment any polynomial-time algorithm solving the problem (exact solution) How to find an almost optimal solution? Approximation algorithm with ratio a > 1 gives a solution A such that OPT  A  a  OPT for a min-optimization problems (1/a)  OPT  A  OPT for a max-optimization problems where OPT is the optimal solution. NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms 2-approximation for VC Minimum Vertex Cover - NP-hard problem (maximum is trivially n) Algorithm: Initialize set C to an empty set While there are remaining edges: Choose an edge {v,w} with the largest degree, where degree of an edge is a sum of degrees of its ends v,w in a current graph G Put v,w to C Remove all the edges adjacent to nodes v,w from graph G Output: witness set C and its size NP-hard problems and Approximation algorithms

Analysis of 2-approximation for VC Correctness: Each edge is removed only after one of its ends is chosen to set C, so each edge is covered Termination: In each iteration we remove at least one edge from the graph, and there are less than n2 edges Approximation ratio 2: For each edge {v,w} selected at the beginning of an iteration at least one end must be in min-VC, and we selected two, so set C is at most twice bigger than the min-VC Time complexity: O(m + n) Exercise NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Approximation for SC Minimum Set Cover - NP-hard problem (maximum is trivially m) Greedy Algorithm: Initialize set C to empty set While there are uncovered nodes: Choose a set F which covers the largest number of uncovered nodes Put F to C Remove all nodes covered by F Output: witness set C and its size NP-hard problems and Approximation algorithms

Analysis of approximation for SC Correctness: Each node is marked as covered when we put the set covering it to set C. The algorithm stops when all nodes are covered. Termination: In each iteration we cover at least one new node, and there are n nodes. Approximation ratio log n: Let Si be the set selected to C in ith iteration, and denote by si the number of uncovered nodes covered by Si; OPT be the minimum covering set Let cv = 1/ si for each node v which was covered by Si for the first time The following holds: |C| = v cv For every set S = Si : vS cv  H(|S|) (H(i)=ji1/j denotes harmonic number) |C| = v cv  SOPT vS cv  H(n) SOPT1 = H(n) |OPT|  |OPT| log n Time and memory complexities: O(M + n), where M is the sum of cardinalities of sets Exercise NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Conclusions Decision problems P and NP-complete Polynomial-time reduction Optimization problems in NP-hard Maximum Independent Set Minimum Vertex Cover Minimum Set Cover Approximation algorithms - polynomial time Min-VC with ratio 2 Min-SC with ratio log n NP-hard problems and Approximation algorithms

Textbook and Questions READING: Chapters 8 and 11, Sections 8.1, 8.2, 8.3, 11.3, 11.4 EXERCISES: What is the time and memory complexities of min-VC approximation algorithm with ratio 2 and min-SC algorithm? Consider a modification of min-VC algorithm: choose a node which covers the largest number of uncovered edges. Is it a 2-approximation algorithm? Having a 2-approximation algorithm for min-VC, is it easy to modify it to be a 2-approximation algorithm for max-IS (since there is a simple polynomial-time reduction between these two problems)? NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Overview Previous lectures: NP-hard problems and approximation algorithms Graph problems (IS, VC) Set problem (SC) This lecture: NP-hard numerical problems and their approximation Numerical Knapsack problem Weighted Independent Set NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Knapsack problem Input: set of n items, each represented by its weight wi and value vi ; thresholds W and V Decision problem: is there a set of items of total weight at most W and total value V ? Optimization problem: find a set of items with total weight at most W , and maximum possible value Assumptions: weights and values are positive integers each weight is at most W NP-hard problems and Approximation algorithms

NP-hardness of knapsack Knapsack is NP-hard problem, but there exists pseudo-polynomial algorithm (complexity is polynomial in terms of values) Typical numerical polynomial algorithm: polynomial in logarithm from the maximum values (longest representation) Existence of pseudo-polynomial solution often yields very good approximation schemes NP-hard problems and Approximation algorithms

Dynamic pseudo-polynomial optimization algorithm Let v* be the maximum (integer) value of an item. Consider any order of objects. Let OPT(i,v) denote the minimum possible total weight of a subset of items 1,2,…,i which has total value v Dynamic formula for i = 0,1,…,n-1 and v = 0,1,…,nv* : OPT(i+1,v) = = min{ OPT(i,v) , wi+1 + OPT(i,max{0,v-vi+1})} Formula OPT does not provide direct solution for our problem, but can be easily adapted: maximum value of knapsack is the maximum value v such that OPT(n,v)  W NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Dynamic algorithm Initialize array M[0…n,0…nv*] for storing OPT(i,v) Fill positions M[,0] and M[0,] with zeros For i = 0,1,…,n-1 For v = 0,1,…,nv* M[i+1,v] := = min{ M[i,v] , wi+1 + M[i,max{0,v-vi+1}] } Go through the whole array M and find the maximum value v such that M[n,v]  W NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Complexities Time: O(n2v*) Initializing array M : O(n2v*) Iterating loop: O(n2v*) Searching for maximum v : O(n2v*) Memory: O(n2v*) NP-hard problems and Approximation algorithms

Polynomial approximation algorithm Fix b = (/(2n)) v* Set (by rounding up) xi = [vi/b] Solve knapsack problem for values xi and weights wi using dynamic program Return set of computed items and its total value in terms of the sum of vi’s NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Analysis PTAS: polynomial time approximation scheme - for any fixed positive  it produces (1+)-approximation in polynomial time (but  is hidden in big Oh) Time: O(n2x*) = O(n3/) Approximation: (1+) NP-hard problems and Approximation algorithms

Analysis of approximation ratio Recall notation: b = (/(2n)) v* xi = [vi/b] Approximation: (1+) Let S denote the set of items returned by the algorithm vi  bxi  vi + b  iS bxi - b|S|  iS vi iS bxi  v* = 2nb/  (2/ -1)nb  iS vi iOPT vi  iOPT bxi  iS bxi  b|S|+iS (bxi - b)  b(2/ -1)n + iS vi   iS vi + iS vi = (1+) iS vi NP-hard problems and Approximation algorithms

Weighted Independent Set Optimization problem: Weighted Independent Set: given graph G of n valued nodes, find an independent set of maximum value (set of nodes such that none two of them are connected by an edge) Even for values 1 problem remains NP-hard, which is not the case for knapsack problem! WIS problem is an example of strong NP-hard problem, and no PTAS is known for it NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Conclusions Optimization numerical problem in NP-hard Maximum Knapsack Weighted Independent Set PTAS in time O(n3) for Knapsack, based on dynamic programming NP-hard problems and Approximation algorithms

Textbook and Questions Chapters 6 and 11, Sections 6.4, 11.8 Is it possible to design an efficient Knapsack algorithm based on dynamic programming for the case where weights are small (values can be arbitrarily large) How to implement arithmetical operations: + - * / and rounding, each in time proportional to at most square of the length of the longest number? What are the complexity formulas? NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Overview Previous lectures: NP-hard problems Approximation algorithms Greedy (VC and SC) Dynamic Programming (Knapsack) This lecture: Approximation through integer programming NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Vertex Cover Weighted Vertex Cover: (weights are in nodes) Decision problem: given weighted graph G of n nodes and parameter k, is there a set of nodes with total weight k such that every edge has at least one end in this set? Optimization problem: given weighted graph G of n nodes, what is the minimum total weight of a set such that every edge has at least one end in this set? NP-hard problems and Approximation algorithms

Approximation algorithms Having an NP-hard problem, we do not know in this moment any polynomial-time algorithm solving the problem (exact solution) How to find almost optimal solution? Approximation algorithm with ratio a > 1 gives a solution A such that OPT  A  a  OPT for a min-optimization problems OPT/a  A  OPT for a max-optimization problems where OPT is an optimal solution. NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms 2-approximation for VC Minimum Vertex Cover - NP-hard problem even for all weights = 1 (maximum is trivially n) Algorithm: (for all weights equal to 1) Initialize set C to empty set While there are remaining edges: Choose an edge {v,w} (with the largest degree, where degree of an edge is a sum of degrees of its ends v,w in a current graph G ) Put v,w to C Remove all the edges adjacent to nodes v,w from graph G Output: witness set C and its size NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Integer Programming Represent the problem as Integer Programming Relax the problem to Linear Programming Solve Linear Programming Round the solution to get integers NP-hard problems and Approximation algorithms

Integer and linear programs Set of constraints (linear equations): x1 , x2  0 x1 + 2x2  6 2x1 + x2  6 Function to minimize (linear): 4x1 + 3x2 Linear programming: variables are real numbers there are polynomial time algorithms solving it (e.g., interior point method - by N. Karmarkar in 1984); simplex method is not polynomial Integer programming: variables are integers problem is NP-hard NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms VC as Integer Program Set of constraints : xi  {0,1} for every node i xi + xj  1 for every pair {i,j}  E Function to minimize: i xiwi Example: x1 , x2 , x3 , x4  {0,1} x1 + x3  1 , x1 + x4  1 , x2 + x4  1 , x2 + x3  1 Minimize: x1 + x2 + x3 + x4 x1 x4 x2 x3 NP-hard problems and Approximation algorithms

Relaxation to Linear Program Set of constraints : yi  [0,1] for every node i yi + yj  1 for every pair {i,j}  E Function to minimize: i yiwi Example: y1 , y2 , y3 , y4  [0,1] y1 + y3  1 , y1 + y4  1 , y2 + y4  1 , y2 + y3  1 Minimize: y1 + y2 + y3 + y4 y1 y4 y2 y3 NP-hard problems and Approximation algorithms

Rounding the linear program solution Obtained exact Linear Program solution yi  [0,1] for every node i satisfying yi + yj  1 for every pair {i,j}  E How to obtain a (approximate?) solution for Integer Program? Rounding: for every node i xi = 1 iff yi  1/2 (otherwise xi = 0) Example: y1 , y2 , y3 , y4 = 1/2 x1 , x2 , x3 , x4 = 1 Optimum solution (minimum) e.g.: x1 , x2 = 1, x3 , x4 = 0 x1 x4 x2 x3 NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Analysis Correctness: since each xi  {0,1} and each edge is guarded by constraint xi + xj  1 which is satisfied also after rounding Time: time for solving linear program plus O(m+n) Approximation: Each xi is at most twice as large as yi hence the weighted sum of xi is also at most twice bigger than the weighted sum of yi Example: y1 , y2 , y3 , y4 = 1/2 x1 , x2 , x3 , x4 = 1 Optimum solution (minimum) e.g.: x1 , x2 = 1, x3 , x4 = 0 x1 x4 x2 x3 NP-hard problems and Approximation algorithms

NP-hard problems and Approximation algorithms Conclusions Decision problems P and NP-complete Polynomial-time reduction Optimization problems in NP-hard Maximum Independent Set Minimum Vertex Cover Minimum Set Cover Maximum Knapsack Approximation algorithms - polynomial time Greedy (VC, SC) Dynamic program (Knapsack) Integer and Linear programs (weighted VC) NP-hard problems and Approximation algorithms

Textbook and Questions READING: Chapter 11, Section 11.6 EXERCISES: Could we solve Weighted VC by modification of greedy algorithm solving (pure) VC? What approximation we get if we apply randomized rounding, i.e., xi = 1 with probability yj (otherwise xi = 0) Traveling Salesman Problem : Section 8.5 TSP can not be approximated with a constant unless P=NP Constant approximation of TSP problem under the assumption that the weights satisfy metric conditions (symmetric weights satisfying triangle inequality) NP-hard problems and Approximation algorithms