Deduction theorem
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In mathematical logic, the deduction theorem is a metatheorem of propositional and firstorder logic.^{[1]} It is a formalization of the common proof technique in which an implication A → B is proved by assuming A and then deriving B from this assumption conjoined with known results. The deduction theorem explains why proofs of conditional sentences in mathematics are logically correct. Though it has seemed "obvious" to mathematicians literally for centuries that proving B from A conjoined with a set of theorems is tantamount to proving the implication A → B based on those theorems alone, it was left to Herbrand and Tarski to show (independently) this was logically correct in the general case.
The deduction theorem states that if a formula B is deducible from a set of assumptions , where A is a closed formula, then the implication A → B is deducible from . In symbols, implies . In the special case where is the empty set, the deduction theorem shows that implies .
The deduction theorem holds for all firstorder theories with the usual deductive systems for firstorder logic^{[2]}. However, there are firstorder systems in which new inference rules are added for which the deduction theorem fails.^{[3]} Most notably, the deduction theorem fails to hold in Birkhoff–von Neumann quantum logic, because the linear subspaces of a Hilbert space form a nondistributive lattice.
The deduction rule is an important property of Hilbertstyle systems because the use of this metatheorem leads to much shorter proofs than would be possible without it. Although the deduction theorem could be taken as a primitive rule of inference in such systems, this approach is not generally followed; instead, the deduction theorem is obtained as an admissible rule using the other logical axioms and modus ponens. In other formal proof systems, the deduction theorem is sometimes taken as a primitive rule of inference. For example, in natural deduction, the deduction theorem is recast as an introduction rule for "→".^{[citation needed]}
Contents
 1 Examples of deduction
 2 Virtual rules of inference
 3 Conversion from proof using the deduction metatheorem to axiomatic proof
 4 The deduction theorem in predicate logic
 5 Example of conversion
 6 Paraconsistent deduction theorem
 7 The resolution theorem
 8 See also
 9 Notes
 10 References
 11 External links
Examples of deduction
"Prove" axiom 1:

P 1. hypothesis
 Q 2. hypothesis
 P 3. reiteration of 1
 Q→P 4. deduction from 2 to 3

P 1. hypothesis
 P→(Q→P) 5. deduction from 1 to 4 QED
"Prove" axiom 2:

P→(Q→R) 1. hypothesis

P→Q 2. hypothesis
 P 3. hypothesis
 Q 4. modus ponens 3,2
 Q→R 5. modus ponens 3,1
 R 6. modus ponens 4,5
 P→R 7. deduction from 3 to 6

P→Q 2. hypothesis
 (P→Q)→(P→R) 8. deduction from 2 to 7

P→(Q→R) 1. hypothesis
 (P→(Q→R))→((P→Q)→(P→R)) 9. deduction from 1 to 8 QED
Using axiom 1 to show ((P→(Q→P))→R)→R:
 (P→(Q→P))→R 1. hypothesis
 P→(Q→P) 2. axiom 1
 R 3. modus ponens 2,1
 ((P→(Q→P))→R)→R 4. deduction from 1 to 3 QED
Virtual rules of inference
From the examples, you can see that we have added three virtual (or extra and temporary) rules of inference to our normal axiomatic logic. These are "hypothesis", "reiteration", and "deduction". The normal rules of inference (i.e. "modus ponens" and the various axioms) remain available.
1. Hypothesis is a step where one adds an additional premise to those already available. So, if your previous step S was deduced as:
then one adds another premise H and gets:
This is symbolized by moving from the nth level of indentation to the n+1th level and saying

S previous step
 H hypothesis

S previous step
2. Reiteration is a step where one reuses a previous step. In practice, this is only necessary when one wants to take a hypothesis which is not the most recent hypothesis and use it as the final step before a deduction step.
3. Deduction is a step where one removes the most recent hypothesis (still available) and prefixes it to the previous step. This is shown by unindenting one level as follows:
 H hypothesis
 ......... (other steps)
 C (conclusion drawn from H)
 H→C deduction
Conversion from proof using the deduction metatheorem to axiomatic proof
In axiomatic versions of propositional logic, one usually has among the axiom schemas (where P, Q, and R are replaced by any propositions):
 Axiom 1 is: P→(Q→P)
 Axiom 2 is: (P→(Q→R))→((P→Q)→(P→R))
 Modus ponens is: from P and P→Q infer Q
These axiom schemas are chosen to enable one to derive the deduction theorem from them easily. So it might seem that we are begging the question. However, they can be justified by checking that they are tautologies using truth tables and that modus ponens preserves truth.
From these axiom schemas one can quickly deduce the theorem schema P→P (reflexivity of implication) which is used below:
 (P→((Q→P)→P))→((P→(Q→P))→(P→P)) from axiom schema 2 with P, (Q→P), P
 P→((Q→P)→P) from axiom schema 1 with P, (Q→P)
 (P→(Q→P))→(P→P) from modus ponens applied to step 2 and step 1
 P→(Q→P) from axiom schema 1 with P, Q
 P→P from modus ponens applied to step 4 and step 3
Suppose that we have that Γ and H prove C, and we wish to show that Γ proves H→C. For each step S in the deduction which is a premise in Γ (a reiteration step) or an axiom, we can apply modus ponens to the axiom 1, S→(H→S), to get H→S. If the step is H itself (a hypothesis step), we apply the theorem schema to get H→H. If the step is the result of applying modus ponens to A and A→S, we first make sure that these have been converted to H→A and H→(A→S) and then we take the axiom 2, (H→(A→S))→((H→A)→(H→S)), and apply modus ponens to get (H→A)→(H→S) and then again to get H→S. At the end of the proof we will have H→C as required, except that now it only depends on Γ, not on H. So the deduction step will disappear, consolidated into the previous step which was the conclusion derived from H.
To minimize the complexity of the resulting proof, some preprocessing should be done before the conversion. Any steps (other than the conclusion) which do not actually depend on H should be moved up before the hypothesis step and unindented one level. And any other unnecessary steps (which are not used to get the conclusion or can be bypassed), such as reiterations which are not the conclusion, should be eliminated.
During the conversion, it may be useful to put all the applications of modus ponens to axiom 1 at the beginning of the deduction (right after the H→H step).
When converting a modus ponens, if A is outside the scope of H, then it will be necessary to apply axiom 1, A→(H→A), and modus ponens to get H→A. Similarly, if A→S is outside the scope of H, apply axiom 1, (A→S)→(H→(A→S)), and modus ponens to get H→(A→S). It should not be necessary to do both of these, unless the modus ponens step is the conclusion, because if both are outside the scope, then the modus ponens should have been moved up before H and thus be outside the scope also.
Under the Curry–Howard correspondence, the above conversion process for the deduction metatheorem is analogous to the conversion process from lambda calculus terms to terms of combinatory logic, where axiom 1 corresponds to the K combinator, and axiom 2 corresponds to the S combinator. Note that the I combinator corresponds to the theorem schema P→P.
The deduction theorem in predicate logic
The deduction theorem is also valid in firstorder logic in the following form:
Here, the symbol means "is a syntactical consequence of." We indicate below how the proof of this deduction theorem differs from that of the deduction theorem in propositional calculus.
In the most common versions of the notion of formal proof, there are, in addition to the axiom schemes of propositional calculus (or the understanding that all tautologies of propositional calculus are to be taken as axiom schemes in their own right), quantifier axioms, and in addition to modus ponens, one additional rule of inference, known as the rule of generalization: "From K, infer ∀vK."
In order to convert a proof of G from T∪{F} to one of F→G from T, one deals with steps of the proof of G which are axioms or result from application of modus ponens in the same way as for proofs in propositional logic. Steps which result from application of the rule of generalization are dealt with via the following quantifier axiom (valid whenever the variable v is not free in formula H):
 (∀v(H→K))→(H→∀vK).
Since in our case F is assumed to be closed, we can take H to be F. This axiom allows one to deduce F→∀vK from F→K and generalization, which is just what is needed whenever the rule of generalization is applied to some K in the proof of G.
Example of conversion
To illustrate how one can convert a natural deduction to the axiomatic form of proof, we apply it to the tautology Q→((Q→R)→R). In practice, it is usually enough to know that we could do this. We normally use the naturaldeductive form in place of the much longer axiomatic proof.
First, we write a proof using a naturaldeduction like method:

Q 1. hypothesis
 Q→R 2. hypothesis
 R 3. modus ponens 1,2
 (Q→R)→R 4. deduction from 2 to 3

Q 1. hypothesis
 Q→((Q→R)→R) 5. deduction from 1 to 4 QED
Second, we convert the inner deduction to an axiomatic proof:
 (Q→R)→(Q→R) 1. theorem schema (A→A)
 ((Q→R)→(Q→R))→(((Q→R)→Q)→((Q→R)→R)) 2. axiom 2
 ((Q→R)→Q)→((Q→R)→R) 3. modus ponens 1,2

Q→((Q→R)→Q) 4. axiom 1
 Q 5. hypothesis
 (Q→R)→Q 6. modus ponens 5,4
 (Q→R)→R 7. modus ponens 6,3
 Q→((Q→R)→R) 8. deduction from 5 to 7 QED
Third, we convert the outer deduction to an axiomatic proof:
 (Q→R)→(Q→R) 1. theorem schema (A→A)
 ((Q→R)→(Q→R))→(((Q→R)→Q)→((Q→R)→R)) 2. axiom 2
 ((Q→R)→Q)→((Q→R)→R) 3. modus ponens 1,2
 Q→((Q→R)→Q) 4. axiom 1
 [((Q→R)→Q)→((Q→R)→R)]→[Q→(((Q→R)→Q)→((Q→R)→R))] 5. axiom 1
 Q→(((Q→R)→Q)→((Q→R)→R)) 6. modus ponens 3,5
 [Q→(((Q→R)→Q)→((Q→R)→R))]→([Q→((Q→R)→Q)]→[Q→((Q→R)→R))]) 7. axiom 2
 [Q→((Q→R)→Q)]→[Q→((Q→R)→R))] 8. modus ponens 6,7
 Q→((Q→R)→R)) 9. modus ponens 4,8 QED
These three steps can be stated succinctly using the Curry–Howard correspondence:
 first, in lambda calculus, the function f = λa. λb. b a has type q → (q → r) → r
 second, by lambda elimination on b, f = λa. s i (k a)
 third, by lambda elimination on a, f = s (k (s i)) k
Paraconsistent deduction theorem
The deduction theorem described above holds in some versions of paraconsistent logic. Usually the classical deduction theorem does not hold in paraconsistent logic. However, the following "twoway deduction theorem" does hold in one form of paraconsistent logic:^{[4]}
 if and only if ( and )
that requires the contrapositive inference to hold in addition to the requirement of the classical deduction theorem.
The resolution theorem
The resolution theorem is the converse of the deduction theorem. It follows immediately from modus ponens which is the elimination rule for implication.
See also
Notes
References
 Carl Hewitt (2008), "ORGs for Scalable, Robust, PrivacyFriendly Client Cloud Computing", IEEE Internet Computing, 12 (5): 96, doi:10.1109/MIC.2008.107. September/October 2008
 Kohlenbach, Ulrich (2008), Applied proof theory: proof interpretations and their use in mathematics, Springer Monographs in Mathematics, Berlin, New York: SpringerVerlag, ISBN 9783540775324, MR 2445721
 Kleene, Stephen Cole (2002) [1967], Mathematical logic, New York: Dover Publications, ISBN 9780486425337, MR 1950307
 Rautenberg, Wolfgang (2010), A Concise Introduction to Mathematical Logic (3rd ed.), New York: Springer Science+Business Media, doi:10.1007/9781441912213, ISBN 9781441912206.
 Shoenfield, Joseph R. (2001) [1967], Mathematical Logic (2nd ed.), A K Peters, ISBN 9781568811352
External links
 Introduction to Mathematical Logic by Vilnis Detlovs and Karlis Podnieks Podnieks is a comprehensive tutorial. See Section 1.5.