logical conjunction

In logic, logical conjunction is the meet in the poset of truth values.

Assuming that (as in classical logic) the only truth values are true ($T$) and false ($F$), then the conjunction $p \wedge q$ of the truth values $p$ and $q$ may be defined by a truth table:

$p$ | $q$ | $p \wedge q$ | |
---|---|---|---|

$T$ | $T$ | $T$ | |

$T$ | $F$ | $F$ | |

$F$ | $T$ | $F$ | |

$F$ | $F$ | $F$ |

That is, $p \wedge q$ is true if and only if $p$ and $q$ are both true. Conjunction also exists in nearly every non-classical logic.

More generally, if $p$ and $q$ are any two relations on the same domain, then we define their conjunction pointwise, thinking of a relation as a function to truth values. If instead we think of a relation as a subset of its domain, then conjunction becomes intersection.

Conjunction is de Morgan dual to disjunction.

Like any meet, conjunction is an associative operation, so we can take the conjunction of any finite positive whole number of truth values; the conjunction is true if and only if all of the individual truth values are true. Conjunction also has an identity element, which is the true truth value. Some logics allow a notion of infinitary conjunction. Indexed conjunction is universal quantification.

As truth values form a poset, which is a degenerate kind of category, so truth values under conjunction form a meet-semilattice, which is a degenerate kind of cartesian monoidal category. Self-referentially, a poset is (up to equivalence) simply a category enriched over the cartesian monoidal category of truth values. With implication as internal hom, truth values form a closed cartesian category.

That conjunction is a meet means that $p \wedge q$ may be proved in a context $\Gamma$ if and only if both $p$ and $q$ may be proved in $\Gamma$. This directly yields the introduction and elimination rules? for conjunction in natural deduction:

$\begin {gathered}
\frac { \Gamma \vdash p ; \; \Gamma \vdash q } { \Gamma \vdash p \wedge q } \; \text {introduction} \\
\frac { \Gamma \vdash p \wedge q } { \Gamma \vdash p } \; \text {elimination 0} \\
\frac { \Gamma \vdash p \wedge q } { \Gamma \vdash q } \; \text {elimination 1} \\
\end {gathered}$

Alternatively, we may use these slightly more complicated (but fewer) inductive forms:

$\begin {gathered}
\frac { \Gamma \vdash p ; \; \Gamma \vdash q } { \Gamma \vdash p \wedge q } \; \text {introduction} \\
\frac { \Gamma , p , q \vdash r } { \Gamma , p \wedge q , \vdash r } \; \text {elimination} \\
\end {gathered}$

In sequent calculus, the same ideas become these rules:

$\begin {gathered}
\frac { \Gamma \vdash \Delta , p , \Sigma ; \; \Gamma \vdash \Delta , q , \Sigma } { \Gamma \vdash \Delta , p \wedge q , \Sigma } \; \text {right additive} \\
\frac { \Gamma , p , \Delta \vdash \Sigma } { \Gamma , p \wedge q , \Delta \vdash \Sigma } \; \text {left additive 0} \\
\frac { \Gamma , q , \Delta \vdash \Sigma } { \Gamma , p \wedge q , \Delta \vdash \Sigma } \; \text {left additive 1} \\
\end {gathered}$

Equivalently, we can use the following rules with weakened contexts:

$\begin {gathered}
\frac { \Gamma \vdash \Delta , p ; \; \Sigma \vdash q , \Pi } { \Gamma , \Sigma \vdash \Delta , p \wedge q , \Pi } \; \text {right multiplicative} \\
\frac { \Gamma , p , q , \Delta \vdash \Sigma } { \Gamma , p \wedge q , \Delta \vdash \Sigma } \text {left multiplicative} \\
\end {gathered}$

The rules above are written so as to remain valid in logics without the exchange rule. In linear logic, the first batch of sequent rules apply to additive conjunction (interpret $p \wedge q$ in these rules as $p \& q$), while the second batch of rules apply to multiplicative conjunction (interpret $p \wedge q$ in those rules as $p \otimes q$).

Revised on February 4, 2014 03:58:51
by Urs Schreiber
(89.204.137.228)