Algorithms, Lecture 3 on NP : Nondeterminis7c Polynomial Time

Transcription

1 Algorithms, Lecture 3 on NP : Nondeterminis7c Polynomial Time

2 Last week: Defined Polynomial Time Reduc7ons: Problem X is poly 7me reducible to Y X P Y if can solve X using poly computa7on and a poly number of calls to an algorithm solving Y. Up to poly factors, X is at least as easy as Y Up to poly factors, Y is harder than X

3 Last class: Defined NP: decision (yes/no) problems can check cer7ficates for yes answers in p7me Have poly 7me proof checkers: A poly 7me algorithm A so that if X(s) = yes, there exists a t so that A(s,t) = yes, and if X(s) = no, for all t, A(s,t) = no

4 Last class: Defined NP- Complete: 1. X NP, and 2. X is NP- hard X is NP- hard if: 1. for all Y NP, Y P X, or 2. CircuitSat P X, or 3. Y P X, for some NP- Hard Y, such as SAT, Independent Set, Vertex Cover

5 Last class: Proved CircuitSAT is NP- Hard. Proved CircuitSAT P SAT. In fact, proved CircuitSAT P 3- SAT Where 3- SAT is SAT, but each clause has at most 3 terms.

6 Last class: Proved CircuitSAT is NP- Hard. Proved CircuitSAT P SAT. In fact, proved CircuitSAT P 3- SAT Where 3- SAT is SAT, but each clause has at most 3 terms. Also possible to force each variable to appear at most 3 7mes

7 Also possible to force each variable to appear at most 3 7mes Say a variable x appears k 7mes. Create k new variables, x 1,, x k, one for each occurrence. Add clauses x 1 V x 2, x 2 V x 3,, x k- 1 V x k, x k V x 1 Only sa7sfied if all are equal.

8 Today Will prove more problems are NP- complete: 3- coloring Hamiltonian Cycle Travelling Salesman Problem

9 k- Coloring Given a graph G = (V,E), does there exist f : V {1,2,, k} (colors) So that for all (u,v) E f(u) f(v)? 3- colorable Not 3- colorable

10 k- Coloring Given a graph G = (V,E), does there exist f : V {1,2,, k} (colors) So that for all (u,v) E f(u) f(v)? 3- colorable Not 3- colorable

11 k- Coloring is NP- Complete Clearly in NP, because can check a proposed coloring To prove NP- hard, will show 3- SAT P 3- Coloring Given a collec7on of clauses C 1,, C k, each with at most 3 terms, on variables x 1,, x n produce graph G = (V,E) that is 3- colorable iff the clauses are sa7sfiable

12 3- Coloring is NP- Complete variable gadgets Create 3 special nodes: T, F, B (base), and one node for each term: x i and x i T F B x 1 x 1 x 2 x 2 x n x n In every 3- coloring, one of x i and x i is colored T and one is colored F

13 3- Coloring is NP- Complete variable gadgets Create 3 special nodes: T, F, B (base), and one node for each term: x i and x i T F B x 1 x 1 x 2 x 2 x n x n In every 3- coloring, one of x i and x i is colored T and one is colored F

14 3- Coloring is NP- Complete clause gadgets Consider clause x 1 V x 2 V x n B x 1 x 2 x n T F Claim: 3- colorable iff terms colored to sa7sfy clause

15 3- Coloring is NP- Complete clause gadgets Claim: 3- colorable iff terms colored to sa7sfy clause 1. If terms all colored F, then cannot 3- color B x 1 x 2 x n T F

16 3- Coloring is NP- Complete clause gadgets Claim: 3- colorable iff terms colored to sa7sfy clause 1. If terms all colored F, then cannot 3- color B x 1 x 2 x n T F

17 k- Coloring is NP- Complete clause gadgets Claim: 3- colorable iff terms colored to sa7sfy clause 1. If terms all colored F, then cannot 3- color B x 1 x 2 x n T F

18 3- Coloring is NP- Complete clause gadgets Claim: 3- colorable iff terms colored to sa7sfy clause 2. If some term true, can 3- color B x 1 x 2 x n T F

19 3- Coloring is NP- Complete clause gadgets Claim: 3- colorable iff terms colored to sa7sfy clause 2. If some term true, can 3- color B x 1 x 2 x n T F

20 3- Coloring is NP- Complete clause gadgets Claim: 3- colorable iff terms colored to sa7sfy clause 2. If some term true, can 3- color B x 1 x 2 x n T F

21 3- Coloring is NP- Complete T B F 3- colorable iff sa7sfiable x 1 x 1 x 2 x 2 x 3 x 3 x n x n x 1 V x 2 V x n

22 k- Coloring is NP- Complete T B F 3- colorable iff sa7sfiable x 1 x 1 x 2 x 2 x 3 x 3 x n x n x 1 V x 2 V x n x 2 V x 3 V x n

23 Hamiltonian Cycle: A cycle in a graph that hits each vertex once. Directed Hamiltonian Cycle: same, but in a directed graph

24 Directed Ham Cycle is NP- Complete Clearly in NP, because can check if a cycle is Hamiltonian To prove NP- hard, will show 3- SAT P Directed Ham Cycle Produce directed graph G = (V,E) that has Ham Cycle iff the clauses are sa7sfiable

25 Start: create graph with 2 n Ham Cycles, then create gadgets to restrict them 1: 2: 3: n:

26 Start: create graph with 2 n Ham Cycles, then create gadgets to restrict them 1: 2: 3: n:

27 Start: create graph with 2 n Ham Cycles, then create gadgets to restrict them 1: 2: 3: n: Must go top- to- bofom, and can traverse each row leg- to- right (True) or right- to- leg (False)

28 Start: create graph with 2 n Ham Cycles, then create gadgets to restrict them 1: 2: 3: n: Must go top- to- bofom, and can traverse each row leg- to- right (True) or right- to- leg (False)

29 Clause gadgets True False clause x 1 forces traverse first row 1: 2: 3: n:

30 Clause gadgets True False clause x 1 V x 2 V x n 1: 2: 3: n: Forces traverse 1, or 2, or n

31 Clause gadgets True False clause x 1 V x 2 V x n 2: To see must come back to same row, note that if do not is no hamiltonian path through unused down- link

32 Ham cycle iff sa7sfiable True False x 1 V x 2 V x n Pf. If sa7sfiable, traverse in order indicated by vars, picking up each clause once using some true term. 1: 2: 3: n:

33 Ham cycle iff sa7sfiable True False x 1 V x 2 V x n Pf. If Ham Cycle, must go top to bot 1: 2: 3: n: assign vars by direc7on if visit each clause node, then is made true by term on row from which make the visit.

34 Directed Ham Cycle P Ham Cycle 1. In directed problem, answer same if reverse all arrows. 2. To transform to undirected, replace each vertex v with three ver7ces: v in, v base, v out u v Replace directed (u,v) edge with (u out, v in ) u in u b u out v in v b v out

35 Directed Ham Cycle P Ham Cycle Replace directed (u,v) edge with (u out, v in ) u v u in u b u out v in v b v out w w in w b w out Directed Ham Cycle in original - > Ham Cycle Every Ham Cycle in the undirected graph must go in, base, out, in, base, out, in, base, out, etc, must correspond to a Ham Cyc in directed graph

36 Directed Ham Cycle P Ham Cycle Replace directed (u,v) edge with (u out, v in ) u v u in u b u out v in v b v out w w in w b w out Directed Ham Cycle in original - > Ham Cycle Every Ham Cycle in the undirected graph must go in, base, out, in, base, out, in, base, out, etc, must correspond to a Ham Cyc in directed graph

37 TSP (Travelling Salesperson Problem) Given n loca7ons, a distance func7on d(u,v) and a total distance D, does there exist a tour through all loca7ons of total distance at most L? hfp://

38 TSP (Travelling Salesperson Problem) Given n loca7ons, a distance func7on d(u,v) and a total distance D, does there exist a tour through all loca7ons of total distance at most L? hfp://

39 RL5915 optimal solution An optimal solution for RL5915 is given by the following tour, which has length hfp://

40 TSP is NP- complete Ham Cycle P TSP Given graph G = (V,E), create one loca7on for each vertex, d(u,v) = 1 if (u,v) E 2 otherwise Target distance = V A tour of all loca7ons that returns to start and has total length V must use exactly n edges of G

41 TSP is NP- complete Ham Cycle P TSP Given graph G = (V,E), create one loca7on for each vertex, d(u,v) = 1 if (u,v) E 2 otherwise This is an abstract distance func7on.

42 TSP is NP- complete Ham Cycle P TSP Given graph G = (V,E), create one loca7on for each vertex, d(u,v) = 1 if (u,v) E 2 otherwise This is an abstract distance func7on. Remains NP- hard for integer points in plane.

43 Issue with Planar TSP If input is loca7ons of points, instead of distances The problem is not known to be in NP, because do not know if can compare distances in polynomial 7me. For integers x 1,, x n integer t, do not have poly 7me algorithm to test if X p xi apple t i

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