 # Cook-Levin Theorem Proof and Illustration

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Cook-Levin Theorem Proof and Illustration
WSAC2010 Talk 11st, January, 2010 Cook-Levin Theorem Proof and Illustration Kwak, Nam-ju Applied Algorithm Laboratory KAIST Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Contents NP NP-complete SAT Problem A Characteristic of NP-complete Cook-Levin Theorem Proof of Cook-Levin Theorem Illustration Corollary: 3SAT∈NPC Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
NP Definition NP is the class of languages that have polynomial time verifiers. Definition (informal) A verifier V for a language A is an algorithm which accepts a given input w to A if a corresponding certificate or a proof c exists. Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
NP Theorem A language is in NP iff it is decided by some nondeterministic polynomial time Turing machine. Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
NP-complete Definition A language B is NP-complete if B∈NP, and ∀A∈NP, A≤PB. Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
NP-complete Examples SAT, 3SAT, CLIQUE, VERTEX-COVER, HAMPATH, SUBSET-SUM, and etc. Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
SAT Problem Definition Boolean variables: variables that can take on the values TRUE and FALSE Boolean operations: AND, OR, and NOT Boolean formula: an expression involving Boolean variable and operations Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
SAT Problem Definition satisfiable: if some assignment of 0s and 1s to the variables make the formula evaluate to 1 Example of a satisfiable Boolean formula φ=(¬x∧y)∨(x∧¬z) x=0, y=1, and z=0 Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
SAT Problem Definition (SAT Problem) SAT = {<φ>|φ is a satisfiable Boolean formula}. Given a Boolean formula, is it satisfiable? Applied Algorithm Lab. KAIST

A Characteristic of NP-complete
Theorem If B∈NPC and B≤PC for C∈NP, then C∈NPC. Is there a fundamental problem for the chain of polynomial time reducibility? P1≤PP2≤P … ≤PPn≤P(?) Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Cook-Levin Theorem Cook-Levin Theorem SAT∈NPC P1≤PP2≤P … ≤PPn≤PSAT Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
What to prove is … SAT∈NP (very clear, not treated here) ∀A∈NP, A≤PSAT We would show that for each language A∈NP with a given input w to it, it is possible to produce a Boolean formula which is satisfiable if w∈A. Definition A≤PB if ∃f such that w∈A⇔f(w)∈B and f is polynomial time computable. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Input Boolean formula φ NP input w Let’s construct this Boolean formula!! Pick one. A SAT w∈A or not? φ∈SAT or not? Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof idea For each language A in NP, with a given input w for A, produce a Boolean formula φ that simulates the deciding NP Turing machine for A on input w. Check if the Boolean formula is satisfiable. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
w∈A? A w NP Turing machine given Focus on this step. transformation Boolean formula φ SAT problem If satisfiable, w∈A; otherwise, w∉A. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof idea (cont.) If w∈A, there exists a series of configurations that results in the accept state, given w as the input of the Turing machine. We would construct a Boolean formula which is satisfiable if the Turing machine accepts with the input w. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
FYI: Turing machine notation example δ(q0,0)={(q1,x,R)}, δ(q1,1)={(q1,y,R)}, δ(q1, ⊔)={(qaccept, ⊔,L)} This Turing machine accepts {01+} With 0111 as an input, q00111⊔ xq1111⊔ xyq111⊔ xyyq11⊔ xyyyq1⊔ xyyyqa⊔ Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
w: input A: language N: NP Turing machine that decides A Assume that N decides whether w∈A in nk steps, for some constant k. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) “nk×nk-cell”tableau for N on input w # q0 w1 w2 wn start configuration second configuration nk nk th configuration nk Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) A variable could be represented as xi,j,s. xi,j,s: true if cell[i,j] is s; otherwise, false. cell[i,j]: the cell located on the ith row and the jth column. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
# q0 w1 w2 wn x q1 # q0q1 w1 w2 wn # q0 w1 w2 wn x q1 # x w1 q3 wn Proof of Cook-Levin Theorem Proof (cont.) The tableau, without any restriction, can contain many invalid series of configurations. e.g. cells containing multiple symbols, not starting with the input w and start state q0, neighbor configurations not corresponding the transition rules, not resulting in the accept state, and etc. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) Produce a Boolean formula which forces the tableau to be valid and result in the accept state. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) One cell can contain exactly one symbol among a state, a tape alphabet, and a #. (φcell) The first configuration should be corresponding to input w and the start state q0. (φstart) A configuration is derivable from the immediately previous configuration according to the transition rule of the Turing machine. (φmove) There should exist a cell containing the accept state. (φaccept) φ=φcell∧φstart∧φmove∧φaccept Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) φ=φcell∧φstart∧φmove∧φaccept Each cell contain at least one symbol. Each cell contain no more than one different symbol. Here, C=Q∪Γ∪{#} where Q and Γ are the state set and tape alphabet of the Turing machine N. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) φ=φcell∧φstart∧φmove∧φaccept Each cell of the first row has a symbol corresponding to the start configuration where the input is w. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) φ=φcell∧φstart∧φmove∧φaccept At least one cell is the accept state. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) φ=φcell∧φstart∧φmove∧φaccept φmove checks whether every 2×3 window is legal according to the transition rule of the Turing machine. # # q0 x y z q1 Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) φ=φcell∧φstart∧φmove∧φaccept For example, δ(q1,a)={(q1,b,R)}, δ(q1,b)={(q2,c,L), (q2,a,R)} a q1 b q2 c a q1 b # b a some examples of legal 2×3 windows a b a q1 b b q1 q2 some examples of illegal 2×3 windows Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) φ=φcell∧φstart∧φmove∧φaccept When Si,j is the set of legal (i, j)-windows and Ui,j is the set of all the (i, j)-windows, Si,j⊆Ui,j, |Ui,j|=|C|6 → |Si,j|≤|C|6 |S|=|ΣSi,j|≤n2k|C|6 That is, the set of legal windows is finite. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) φ=φcell∧φstart∧φmove∧φaccept That is, for all legal (i, j)-windows, which is represented as … a1 a2 a3 a4 a5 a6 Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
Proof (cont.) φ=φcell∧φstart∧φmove∧φaccept Now, we get φ as we wished. If φ is satisfiable, w∈A. That is, to see if w∈A, we just need to check whether φ is satisfiable or not. It is just a SAT problem. Applied Algorithm Lab. KAIST

Proof of Cook-Levin Theorem
What to prove is … (restated) SAT∈NP (very clear, not treated here) ∀A∈NP, A≤PSAT Definition (restated) A≤PB if ∃f such that w∈A⇔f(w)∈B and f is polynomial time computable. What we’ve shown is … w, A, and w∈A f(w)=φ, B=SAT, and φ=f(w)∈B=SAT w∈A⇔φ∈SAT ∴A≤PSAT Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Illustration N=(Q, Σ, Γ, δ, q0, qaccept) Q={q0, q1, qaccept} Σ={0, 1}, Γ={0, 1, ⊔} δ(q0,0)={(q1,0,R)} δ(q1,1)={(q1,1,R)} δ(q1, ⊔)={(qaccept, ⊔,L)} A=L(N)={01+}={01, 011, 0111, 01111, …} w=0111 Then, w∈A? Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Illustration N can decide in n2 steps where n=|w|. Therefore n2 is 16. C={q0, q1, qaccept, 0, 1, ⊔, #} # q0 1 16×16 tableau Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Illustration Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Illustration Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Illustration Applied Algorithm Lab. KAIST

Illustration For φmove, find out all the legal windows. # q0 q1 q0 q1
q1 q0 q1 q0 1 q1 q1 1 1 q1 q1 1 q1 1 1 q1 1 q1 qacc q1 qacc qacc No more than n2k|C|6=42*246=410 legal windows exist. (finite) Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Illustration Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Illustration Now, we get φ=φcell∧φstart∧φmove∧φaccept. Applied Algorithm Lab. KAIST

Illustration ∧ Solve a SAT problem with this Boolean formula, φ.
If satisfiable, w=0111∈A={01+}. (Actually, it is right.) Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Corollary: 3SAT∈NPC CNFs can be converted into CNFs with three literals per clause (as explained soon). At first, convert φcell, φstart, φmove, and φaccept into CNF. Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Corollary: 3SAT∈NPC φcell, φstart, and φaccept are already in CNF. Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Corollary: 3SAT∈NPC φmove is converted into CNF using the distributive laws. To CNFs have 3 literals per clause For each clause with less than 3 literals, do literal replication. For each clause with more than 3 literals, split it with new variables. Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Corollary: 3SAT∈NPC Examples (a1∨a2)≡(a1∨a2∨a2) (a1∨a2∨a3∨a4)≡(a1∨a2∨z)∧(¬z∨a3∨a4) (a1∨a2∨a3∨a4∨a5)≡ (a1∨a2∨z1)∧(¬z1∨a3∨z2)∧(¬z2∨a4∨a5 ) Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST
Corollary: 3SAT∈NPC Hence, a SAT problem is able to converted into a equivalent 3SAT problem (in polynomial time). That is, SAT≤P3SAT. Since SAT∈NPC, considering the definition of NPC, 3SAT∈NPC, too. Applied Algorithm Lab. KAIST

Conclusion Theorem (restated)
SAT∈NPC 3SAT∈NPC All the NP problems are polynomial time reducible into SAT. <Important NP-complete problems> Picture from Applied Algorithm Lab. KAIST

Applied Algorithm Lab. KAIST