Candidate key

Example

The definition of candidate keys can be illustrated with the following (abstract) example. Consider a relation variable (relvar) R with attributes (A, B, C, D) that has only the following two legal values r1 and r2:

Here r2 differs from r1 only in the A and D values of the last tuple.

For r1 the following sets have the uniqueness property, i.e., there are no two distinct tuples in the instance with the same attribute values in the set:

{A,B}, {A,C}, {B,C}, {A,B,C}, {A,B,D}, {A,C,D}, {B,C,D}, {A,B,C,D}

For r2 the uniqueness property holds for the following sets;

{B,C}, {B,D}, {C,D}, {A,B,C}, {A,B,D}, {A,C,D}, {B,C,D}, {A,B,C,D}

Since superkeys of a relvar are those sets of attributes that have the uniqueness property for all legal values of that relvar and because we assume that r1 and r2 are all the legal values that R can take, we can determine the set of superkeys of R by taking the intersection of the two lists:

{B,C}, {A,B,C}, {A,B,D}, {A,C,D}, {B,C,D}, {A,B,C,D}

Finally we need to select those sets for which there is no proper subset in the list, which are in this case:

{B,C}, {A,B,D}, {A,C,D}

These are indeed the candidate keys of relvar R.

We have to consider all the relations that might be assigned to a relvar to determine whether a certain set of attributes is a candidate key. For example, if we had considered only r1 then we would have concluded that {A,B} is a candidate key, which is incorrect. However, we might be able to conclude from such a relation that a certain set is not a candidate key, because that set does not have the uniqueness property (example {A,D} for r1). Note that the existence of a proper subset of a set that has the uniqueness property cannot in general be used as evidence that the superset is not a candidate key. In particular, note that in the case of an empty relation, every subset of the heading has the uniqueness property, including the empty set.

Determining candidate keys

The set of all candidate keys can be computed e.g. from the set of functional dependencies. To this end we need to define the attribute closure ${\displaystyle \alpha +}$ for an attribute set ${\displaystyle \alpha }$. The set ${\displaystyle \alpha ^{+}}$ contains all attributes that are functionally implied by ${\displaystyle \alpha }$.

It is quite simple to find a single candidate key. We start with a set ${\displaystyle \alpha }$ of attributes and try to remove successively each attribute. If after removing an attribute the attribute closure stays the same, then this attribute is not necessary and we can remove it permanently. We call the result ${\displaystyle {\text{minimize}}(\alpha )}$. If ${\displaystyle \alpha }$ is the set of all attributes, then ${\displaystyle {\text{minimize}}(\alpha )}$ is a candidate key.

Actually we can detect every candidate key with this procedure by simply trying every possible order of removing attributes. However there are many more permutations of attributes (${\displaystyle n!}$) than subsets (${\displaystyle 2^{n}}$). That is, many attribute orders will lead to the same candidate key.

There is a fundamental difficulty for efficient algorithms for candidate key computation: Certain sets of functional dependencies lead to exponentially many candidate keys. Consider the ${\displaystyle 2\cdot n}$ functional dependencies ${\displaystyle \{A_{i}\rightarrow B_{i}:i\in \{1,\dots ,n\}\}\cup \{B_{i}\rightarrow A_{i}:i\in \{1,\dots ,n\}\}}$ which yields ${\displaystyle 2^{n}}$ candidate keys: ${\displaystyle \{A_{1},B_{1}\}\times \dots \times \{A_{n},B_{n}\}}$. That is, the best we can expect is an algorithm that is efficient with respect to the number of candidate keys.

The following algorithm actually runs in polynomial time in the number of candidate keys and functional dependencies:^[2]

function find_candidate_keys(A, F)
    /* A is the set of all attributes and F is the set of functional dependencies */
    K[0] := minimize(A);
    n := 1; /* Number of Keys known so far */
    i := 0; /* Currently processed key */
    while i < n do
        for each α → β ∈ F do
            /* Build a new potential key from the previous known key and the current FD */
            S := α ∪ (K[i] − β);
            /* Search whether the new potential key is part of the already known keys */ 
            found := false;
            for j := 0 to n-1 do
                if K[j] ⊆ S then found := true;
            /* If not, add if 
            if not found then
                K[n] := minimize(S);
                n := n + 1;
        i := i + 1
    return K

The idea behind the algorithm is that given a candidate key ${\displaystyle K_{i}}$ and a functional dependency ${\displaystyle \alpha \rightarrow \beta }$, the reverse application of the functional dependency yields the set ${\displaystyle \alpha \cup (K_{i}\setminus \beta )}$, which is a key, too. It may however be covered by other already known candidate keys. (The algorithm checks this case using the 'found' variable.) If not, then minimizing the new key yields a new candidate key. The key insight is that all candidate keys can be created this way.

See also

• Alternate key
• Compound key
• Database normalization
• Primary key
• Relational database
• Superkey
• Prime implicant is the corresponding notion of a candidate key in boolean logic

References

• Date, Christopher (2003). "5: Integrity". An Introduction to Database Systems. Addison-Wesley. pp. 268–276. ISBN 978-0-321-18956-1.

External links

• Relational Database Management Systems - Database Design - Terms of Reference - Keys: An overview of the different types of keys in the RDBMS (Relational Database Management System).